Lambda the ultimate Pattern Factory: FP, Haskell, Typeclassopedia vs Software Design Patterns

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Lambda the ultimate Pattern Factory: FP, Haskell, Typeclassopedia vs Software Design Patterns | ||||||||||

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Readme

My first programming languages were Lisp, Scheme, and ML. When I later started to work in OO languages like C++ and Java I noticed that idioms that are standard vocabulary in functional programming (fp) were not so easy to achieve and required sophisticated structures. Books like Design Patterns: Elements of Reusable Object-Oriented Software were a great starting point to reason about those structures. One of my earliest findings was that several of the GoF-Patterns had a stark resemblance of structures that are built into in functional languages: for instance the strategy pattern corresponds to higher order functions in fp (more details see below).

Recently, while re-reading through the Typeclassopedia I thought it would be a good exercise to map the structure of software design-patterns to the concepts found in the Haskell type class library and in functional programming in general.

By searching the web I found some blog entries studying specific patterns, but I did not come across any comprehensive study. As it seemed that nobody did this kind of work yet I found it worthy to spend some time on it and write down all my findings on the subject.

I think this kind of exposition could be helpful if you are:

- a programmer with an OO background who wants to get a better grip on how to implement more complex designs in functional programming
- a functional programmer who wants to get a deeper intuition for type classes.
- studying the Typeclassopedia and are looking for an accompanying reading providing example use cases and working code.

This project is work in progress, so please feel free to contact me with any corrections, adjustments, comments, suggestions and additional ideas you might have. Please use the Issue Tracker to enter your requests.

- Lambda the ultimate pattern factory
- The Patternopedia
- Beyond type class patterns
- Functional Programming Patterns
- Conclusions
- Some related links

The Typeclassopedia is a now classic paper that introduces the Haskell type classes by clarifying their algebraic and category-theoretic background. In particular it explains the relationships among those type classes.

In this chapter I'm taking a tour through the Typeclassopedia from a design pattern perspective. For each of the Typeclassopedia type classes I try to explain how it corresponds to structures applied in software design patterns.

As a reference map I have included the following chart that depicts the Relationships between type classes covered in the Typeclassopedia:

- Solid arrows point from the general to the specific; that is, if there is an arrow from Foo to Bar it means that every Bar is (or should be, or can be made into) a Foo.
- Dotted lines indicate some other sort of relationship.
- Monad and ArrowApply are equivalent.
- Apply and Comonad are greyed out since they are not actually (yet?) in the standard Haskell libraries ∗.

In the field of programming a data transfer object (DTO) is an object that carries data between processes. The motivation for its use is that communication between processes is usually done resorting to remote interfaces (e.g., web services), where each call is an expensive operation. Because the majority of the cost of each call is related to the round-trip time between the client and the server, one way of reducing the number of calls is to use an object (the DTO) that aggregates the data that would have been transferred by the several calls, but that is served by one call only. (quoted from Wikipedia

Data Transfer Object is a pattern from Martin Fowler's Patterns of Enterprise Application Architecture. It is typically used in multi-layered applications where data is transferred between backends and frontends.

The aggregation of data usually also involves a denormalization of data structures. As an example, please refer to the following
diagram where two entities from the backend (`Album`

and `Artist`

) are assembled to a compound denormalized DTO `AlbumDTO`

:

Of course, there is also an inverse mapping from `AlbumDTO`

to `Album`

which is not shown in this diagram.

In Haskell `Album`

, `Artist`

and `AlbumDTO`

can be represented as data types with record notation:

```
data Album = Album {
title :: String
, publishDate :: Int
, labelName :: String
, artist :: Artist
} deriving (Show)
data Artist = Artist {
publicName :: String
, realName :: Maybe String
} deriving (Show)
data AlbumDTO = AlbumDTO {
albumTitle :: String
, published :: Int
, label :: String
, artistName :: String
} deriving (Show, Read)
```

The transfer from an `Album`

to an `AlbumDTO`

and vice versa can be achieved by two simple functions, that perfom the
intended field wise mappings:

```
toAlbumDTO :: Album -> AlbumDTO
toAlbumDTO Album {title = t, publishDate = d, labelName = l, artist = a} =
AlbumDTO {albumTitle = t, published = d, label = l, artistName = (publicName a)}
toAlbum :: AlbumDTO -> Album
toAlbum AlbumDTO {albumTitle = t, published = d, label = l, artistName = n} =
Album {title = t, publishDate = d, labelName = l, artist = Artist {publicName = n, realName = Nothing}}
```

In this few lines we have covered the basic idea of the DTO pattern.

Now, let's consider the typical situation that you don't have to transfer only a *single* `Album`

instance but a whole
list of `Album`

instances, e.g.:

```
albums :: [Album]
albums =
[
Album {title = "Microgravity",
publishDate = 1991,
labelName = "Origo Sound",
artist = Artist {publicName = "Biosphere", realName = Just "Geir Jenssen"}}
, Album {title = "Apollo - Atmospheres & Soundtracks",
publishDate = 1983,
labelName = "Editions EG",
artist = Artist {publicName = "Brian Eno", realName = Just "Brian Peter George St. John le Baptiste de la Salle Eno"}}
]
```

In this case we have to apply the `toAlbumDTO`

function to all elements of the list.
In Haskell this *higher order* operation is called `map`

:

```
map :: (a -> b) -> [a] -> [b]
map _f [] = []
map f (x:xs) = f x : map f xs
```

`map`

takes a function `f :: (a -> b)`

(a function from type `a`

to type `b`

) and an `[a]`

list and returns a `[b]`

list.
The `b`

elements are produced by applying the function `f`

to each element of the input list.
Applying `toAlbumDTO`

to a list of albums can thus be done in the Haskell REPL GHCi as follows:

```
λ> map toAlbumDTO albums
[AlbumDTO {albumTitle = "Microgravity", published = 1991, label = "Origo Sound", artistName = "Biosphere"},
AlbumDTO {albumTitle = "Apollo - Atmospheres & Soundtracks", published = 1983, label = "Editions EG", artistName = "Brian Eno"}]
```

This mapping of functions over lists is a basic technique known in many functional languages.
In Haskell further generalises this technique with the concept of the `Functor`

type class.

The

`Functor`

class is the most basic and ubiquitous type class in the Haskell libraries. A simple intuition is that a`Functor`

represents a “container” of some sort, along with the ability to apply a function uniformly to every element in the container. For example, a list is a container of elements, and we can apply a function to every element of a list, using`map`

. As another example, a binary tree is also a container of elements, and it’s not hard to come up with a way to recursively apply a function to every element in a tree.Another intuition is that a Functor represents some sort of “computational context”. This intuition is generally more useful, but is more difficult to explain, precisely because it is so general.

Quoted from Typeclassopedia

Basically, all instances of the `Functor`

type class must provide a function `fmap`

:

```
class Functor f where
fmap :: (a -> b) -> f a -> f b
```

For Lists the implementation is simply the `map`

function that we already have seen above:

```
instance Functor [] where
fmap = map
```

Functors have interesting properties, they fulfill the two so called *functor laws*,
which are part of the definition of a mathematical functor:

```
fmap id = id -- (1)
fmap (g . h) = (fmap g) . (fmap h) -- (2)
```

The first law `(1)`

states that mapping the identity function over every item in a container has no effect.

The second `(2)`

says that mapping a composition of two functions over every item in a container is the same as first
mapping one function, and then mapping the other.

These laws are very useful when we consider composing complex mappings from simpler operations.

Say we want to extend our DTO mapping functionality by also providing some kind of marshalling. For a single album instance,
we can use function composition `(f . g) x == f (g x)`

, which is defined in Haskell as:

```
(.) :: (b -> c) -> (a -> b) -> a -> c
(.) f g x = f (g x)
```

In the following GHCi session we are using `(.)`

to first convert an `Album`

to its `AlbumDTO`

representation and then
turn that into a `String`

by using the `show`

function:

```
λ> album1 = albums !! 0
λ> print album1
Album {title = "Microgravity", publishDate = 1991, labelName = "Origo Sound", artist = Artist {publicName = "Biosphere", realName = Just "Geir Jenssen"}}
λ> marshalled = (show . toAlbumDTO) album1
λ> :t marshalled
marshalled :: String
λ> print marshalled
"AlbumDTO {albumTitle = \"Microgravity\", published = 1991, label = \"Origo Sound\", artistName = \"Biosphere\"}"
```

As we can rely on the functor law `fmap (g . h) = (fmap g) . (fmap h)`

we can use fmap to use the same composed
function on any functor, for example our list of albums:

```
λ> fmap (show . toAlbumDTO) albums
["AlbumDTO {albumTitle = \"Microgravity\", published = 1991, label = \"Origo Sound\", artistName = \"Biosphere\"}",
"AlbumDTO {albumTitle = \"Apollo - Atmospheres & Soundtracks\", published = 1983, label = \"Editions EG\", artistName = \"Brian Eno\"}"]
```

We can build more complex mappings by chaining multiple functions, to produce for example a gzipped byte string output:

```
λ> gzipped = (compress . pack . show . toAlbumDTO) album1
```

As the sequence of operation must be read from right to left for the `(.)`

operator this becomes quite unintuitive for longer sequences.
Thus, Haskellers often use the flipped version of `(.)`

, `(>>>)`

which is defined as:

```
f >>> g = g . f
```

Using `(>>>)`

the intent of our composition chain becomes much clearer (at least when you are trained to read from left to right):

```
λ> gzipped = (toAlbumDTO >>> show >>> pack >>> compress) album1
```

Unmarshalling can be defined using the inverse operations:

```
λ> unzipped = (decompress >>> unpack >>> read >>> toAlbum) gzipped
λ> :t unzipped
unzipped :: Album
λ> print unzipped
Album {title = "Microgravity", publishDate = 1991, labelName = "Origo Sound", artist = Artist {publicName = "Biosphere", realName = Nothing}}
```

Of course, we can use `fmap`

to apply such composed mapping function to any container type instantiating the `Functor`

type class:

```
λ> marshalled = fmap (toAlbumDTO >>> show >>> pack >>> compress) albums
λ> unmarshalled = fmap (decompress >>> unpack >>> read >>> toAlbum) marshalled
λ> print unmarshalled
[Album {title = "Microgravity", publishDate = 1991, labelName = "Origo Sound", artist = Artist {publicName = "Biosphere", realName = Nothing}},
Album {title = "Apollo - Atmospheres & Soundtracks", publishDate = 1983, labelName = "Editions EG", artist = Artist {publicName = "Brian Eno", realName = Nothing}}]
```

"The singleton pattern is a software design pattern that restricts the instantiation of a class to one object. This is useful when exactly one object is needed to coordinate actions across the system." (quoted from Wikipedia

The singleton pattern ensures that multiple requests to a given object always return one and the same singleton instance.
In functional programming this semantics can be achieved by `let`

:

```
let singleton = someExpensiveComputation
in mainComputation
--or in lambda notation:
(\singleton -> mainComputation) someExpensiveComputation
```

Via the `let`

-Binding we can thread the singleton through arbitrary code in the `in`

block. All occurences of `singleton`

in the `mainComputation`

will point to the same instance.

Type classes provide several tools to make this kind of threading more convenient or even to avoid explicit threading of instances.

The following code defines a simple expression evaluator:

```
data Exp e = Var String
| Val e
| Add (Exp e) (Exp e)
| Mul (Exp e) (Exp e)
-- the environment is a list of tuples mapping variable names to values of type e
type Env e = [(String, e)]
-- a simple evaluator reducing expression to numbers
eval :: Num e => Exp e -> Env e -> e
eval (Var x) env = fetch x env
eval (Val i) env = i
eval (Add p q) env = eval p env + eval q env
eval (Mul p q) env = eval p env * eval q env
```

`eval`

is a classic evaluator function that recursively evaluates sub-expression before applying `+`

or `*`

.
Note how the explicit `env`

parameter is threaded through the recursive eval calls. This is needed to have the
environment avalailable for variable lookup at any recursive call depth.

If we now bind `env`

to a value as in the following snippet it is used as an immutable singleton within the recursive evaluation of `eval exp env`

.

```
main = do
let exp = Mul (Add (Val 3) (Val 1))
(Mul (Val 2) (Var "pi"))
env = [("pi", pi)]
print $ eval exp env
```

Experienced Haskellers will notice the "eta-reduction smell" in `eval (Var x) env = fetch x env`

which hints at the possibilty to remove `env`

as an explicit parameter. We can not do this right away as the other equations for `eval`

do not allow eta-reduction. In order to do so we have to apply the combinators of the `Applicative Functor`

:

```
class Functor f => Applicative f where
pure :: a -> f a
(<*>) :: f (a -> b) -> f a -> f b
instance Applicative ((->) a) where
pure = const
(<*>) f g x = f x (g x)
```

This `Applicative`

allows us to rewrite `eval`

as follows:

```
eval :: Num e => Exp e -> Env e -> e
eval (Var x) = fetch x
eval (Val i) = pure i
eval (Add p q) = pure (+) <*> eval p <*> eval q
eval (Mul p q) = pure (*) <*> eval p <*> eval q
```

Any explicit handling of the variable `env`

is now removed.
(I took this example from the classic paper Applicative programming with effects which details how `pure`

and `<*>`

correspond to the combinatory logic combinators `K`

and `S`

.)

In software engineering, a pipeline consists of a chain of processing elements (processes, threads, coroutines, functions, etc.), arranged so that the output of each element is the input of the next; the name is by analogy to a physical pipeline. (Quoted from: Wikipedia

The concept of pipes and filters in Unix shell scripts is a typical example of the pipeline architecture pattern.

```
$ echo "hello world" | wc -w | xargs printf "%d*3\n" | bc -l
6
```

This works exactly as stated in the wikipedia definition of the pattern: the output of `echo "hello world"`

is used as input for the next command `wc -w`

. The ouptput of this command is then piped as input into `xargs printf "%d*3\n"`

and so on.
On the first glance this might look like ordinary function composition. We could for instance come up with the following approximation in Haskell:

```
((3 *) . length . words) "hello world"
6
```

But with this design we missed an important feature of the chain of shell commands: The commands do not work on elementary types like Strings or numbers but on input and output streams that are used to propagate the actual elementary data around. So we can't just send a String into the `wc`

command as in `"hello world" | wc -w`

. Instead we have to use `echo`

to place the string into a stream that we can then use as input to the `wc`

command:

```
> echo "hello world" | wc -w
```

So we might say that `echo`

*injects* the String `"hello world"`

into the stream context.
We can capture this behaviour in a functional program like this:

```
-- The Stream type is a wrapper around an arbitrary payload type 'a'
newtype Stream a = Stream a deriving (Show)
-- echo injects an item of type 'a' into the Stream context
echo :: a -> Stream a
echo = Stream
-- the 'andThen' operator used for chaining commands
infixl 7 |>
(|>) :: Stream a -> (a -> Stream b) -> Stream b
Stream x |> f = f x
-- echo and |> are used to create the actual pipeline
pipeline :: String -> Stream Int
pipeline str =
echo str |> echo . length . words |> echo . (3 *)
-- now executing the program in ghci repl:
ghci> pipeline "hello world"
Stream 6
```

The `echo`

function injects any input into the `Stream`

context:

```
ghci> echo "hello world"
Stream "hello world"
```

The `|>`

(pronounced as "andThen") does the function chaining:

```
ghci> echo "hello world" |> echo . words
Stream ["hello","world"]
```

The result of `|>`

is of type `Stream b`

that's why we cannot just write `echo "hello world" |> words`

. We have to use echo to create a `Stream`

output that can be digested by a subsequent `|>`

.

The interplay of a Context type `Stream a`

and the functions `echo`

and `|>`

is a well known pattern from functional languages: it's the legendary *Monad*. As the Wikipedia article on the pipeline pattern states:

Pipes and filters can be viewed as a form of functional programming, using byte streams as data objects; more specifically, they can be seen as a particular form of monad for I/O.

There is an interesting paper available elaborating on the monadic nature of Unix pipes: Monadic Shell.

Here is the definition of the Monad type class in Haskell:

```
class Applicative m => Monad m where
-- | Sequentially compose two actions, passing any value produced
-- by the first as an argument to the second.
(>>=) :: m a -> (a -> m b) -> m b
-- | Inject a value into the monadic type.
return :: a -> m a
return = pure
```

By looking at the types of `>>=`

and `return`

it's easy to see the direct correspondence to `|>`

and `echo`

in the pipeline example above:

```
(|>) :: Stream a -> (a -> Stream b) -> Stream b
echo :: a -> Stream a
```

Mhh, this is nice, but still looks a lot like ordinary composition of functions, just with the addition of a wrapper.
In this simplified example that's true, because we have designed the `|>`

operator to simply unwrap a value from the Stream and bind it to the formal parameter of the subsequent function:

```
Stream x |> f = f x
```

But we are free to implement the `andThen`

operator in any way that we seem fit as long we maintain the type signature and the monad laws.
So we could for instance change the semantics of `>>=`

to keep a log along the execution pipeline:

```
-- The DeriveFunctor Language Pragma provides automatic derivation of Functor instances
{-# LANGUAGE DeriveFunctor #-}
-- a Log is just a list of Strings
type Log = [String]
-- the Stream type is extended by a Log that keeps track of any logged messages
newtype LoggerStream a = LoggerStream (a, Log) deriving (Show, Functor)
instance Applicative LoggerStream where
pure = return
LoggerStream (f, _) <*> r = fmap f r
-- our definition of the Logging Stream Monad:
instance Monad LoggerStream where
-- returns a Stream wrapping a tuple of the actual payload and an empty Log
return a = LoggerStream (a, [])
-- we define (>>=) to return a tuple (composed functions, concatenated logs)
m1 >>= m2 = let LoggerStream(f1, l1) = m1
LoggerStream(f2, l2) = m2 f1
in LoggerStream(f2, l1 ++ l2)
-- compute length of a String and provide a log message
logLength :: String -> LoggerStream Int
logLength str = let l = length(words str)
in LoggerStream (l, ["length(" ++ str ++ ") = " ++ show l])
-- multiply x with 3 and provide a log message
logMultiply :: Int -> LoggerStream Int
logMultiply x = let z = x * 3
in LoggerStream (z, ["multiply(" ++ show x ++ ", 3" ++") = " ++ show z])
-- the logging version of the pipeline
logPipeline :: String -> LoggerStream Int
logPipeline str =
return str >>= logLength >>= logMultiply
-- and then in Ghci:
> logPipeline "hello logging world"
LoggerStream (9,["length(hello logging world) = 3","multiply(3, 3) = 9"])
```

What's noteworthy here is that Monads allow to make the mechanism of chaining functions *explicit*. We can define what `andThen`

should mean in our pipeline by choosing a different Monad implementation.
So in a sense Monads could be called programmable semicolons

To make this statement a bit clearer we will have a closer look at the internal workings of the `Maybe`

Monad in the next section.

[...] a null object is an object with no referenced value or with defined neutral ("null") behavior. The null object design pattern describes the uses of such objects and their behavior (or lack thereof). Quoted from Wikipedia

In functional programming the null object pattern is typically formalized with option types:

[...] an option type or maybe type is a polymorphic type that represents encapsulation of an optional value; e.g., it is used as the return type of functions which may or may not return a meaningful value when they are applied. It consists of a constructor which either is empty (named None or

`Nothing`

), or which encapsulates the original data type`A`

(written`Just A`

or Some A). Quoted from Wikipedia

(See also: Null Object as Identity)

In Haskell the most simple option type is `Maybe`

. Let's directly dive into an example. We define a reverse index, mapping songs to album titles.
If we now lookup up a song title we may either be lucky and find the respective album or not so lucky when there is no album matching our song:

```
import Data.Map (Map, fromList)
import qualified Data.Map as Map (lookup) -- avoid clash with Prelude.lookup
-- type aliases for Songs and Albums
type Song = String
type Album = String
-- the simplified reverse song index
songMap :: Map Song Album
songMap = fromList
[("Baby Satellite","Microgravity")
,("An Ending", "Apollo: Atmospheres and Soundtracks")]
```

We can lookup this map by using the function `Map.lookup :: Ord k => k -> Map k a -> Maybe a`

.

If no match is found it will return `Nothing`

if a match is found it will return `Just match`

:

```
ghci> Map.lookup "Baby Satellite" songMap
Just "Microgravity"
ghci> Map.lookup "The Fairy Tale" songMap
Nothing
```

Actually the `Maybe`

type is defined as:

```
data Maybe a = Nothing | Just a
deriving (Eq, Ord)
```

All code using the `Map.lookup`

function will never be confronted with any kind of Exceptions, null pointers or other nasty things. Even in case of errors a lookup will always return a properly typed `Maybe`

instance. By pattern matching for `Nothing`

or `Just a`

client code can react on failing matches or positive results:

```
case Map.lookup "Ancient Campfire" songMap of
Nothing -> print "sorry, could not find your song"
Just a -> print a
```

Let's try to apply this to an extension of our simple song lookup. Let's assume that our music database has much more information available. Apart from a reverse index from songs to albums, there might also be an index mapping album titles to artists. And we might also have an index mapping artist names to their websites:

```
type Song = String
type Album = String
type Artist = String
type URL = String
songMap :: Map Song Album
songMap = fromList
[("Baby Satellite","Microgravity")
,("An Ending", "Apollo: Atmospheres and Soundtracks")]
albumMap :: Map Album Artist
albumMap = fromList
[("Microgravity","Biosphere")
,("Apollo: Atmospheres and Soundtracks", "Brian Eno")]
artistMap :: Map Artist URL
artistMap = fromList
[("Biosphere","http://www.biosphere.no//")
,("Brian Eno", "http://www.brian-eno.net")]
lookup' :: Ord a => Map a b -> a -> Maybe b
lookup' = flip Map.lookup
findAlbum :: Song -> Maybe Album
findAlbum = lookup' songMap
findArtist :: Album -> Maybe Artist
findArtist = lookup' albumMap
findWebSite :: Artist -> Maybe URL
findWebSite = lookup' artistMap
```

With all this information at hand we want to write a function that has an input parameter of type `Song`

and returns a `Maybe URL`

by going from song to album to artist to website url:

```
findUrlFromSong :: Song -> Maybe URL
findUrlFromSong song =
case findAlbum song of
Nothing -> Nothing
Just album ->
case findArtist album of
Nothing -> Nothing
Just artist ->
case findWebSite artist of
Nothing -> Nothing
Just url -> Just url
```

This code makes use of the pattern matching logic described before. It's worth to note that there is some nice circuit breaking happening in case of a `Nothing`

. In this case `Nothing`

is directly returned as result of the function and the rest of the case-ladder is not executed.
What's not so nice is *"the dreaded ladder of code marching off the right of the screen"* (quoted from Real World Haskell).

For each find function we have to repeat the same ceremony of pattern matching on the result and either return `Nothing`

or proceed with the next nested level.

The good news is that it is possible to avoid this ladder.
We can rewrite our search by applying the `andThen`

operator `>>=`

as `Maybe`

is an instance of `Monad`

:

```
findUrlFromSong' :: Song -> Maybe URL
findUrlFromSong' song =
findAlbum song >>= \album ->
findArtist album >>= \artist ->
findWebSite artist
```

or even shorter as we can eliminate the lambda expressions by applying eta-conversion:

```
findUrlFromSong'' :: Song -> Maybe URL
findUrlFromSong'' song =
findAlbum song >>= findArtist >>= findWebSite
```

Using it in GHCi:

```
ghci> findUrlFromSong'' "All you need is love"
Nothing
ghci> findUrlFromSong'' "An Ending"
Just "http://www.brian-eno.net"
```

The expression `findAlbum song >>= findArtist >>= findWebSite`

and the sequencing of actions in the pipeline example `return str >>= return . length . words >>= return . (3 *)`

have a similar structure.

But the behaviour of both chains is quite different: In the Maybe Monad `a >>= b`

does not evaluate b if `a == Nothing`

but stops the whole chain of actions by simply returning `Nothing`

.

The pattern matching and 'short-circuiting' is directly coded into the definition of `(>>=)`

in the Monad implementation of `Maybe`

:

```
instance Monad Maybe where
(Just x) >>= k = k x
Nothing >>= _ = Nothing
```

This elegant feature of `(>>=)`

in the `Maybe`

Monad allows us to avoid ugly and repetetive coding.

Maybe is often used to avoid the exposure of partial functions to client code. Take for example division by zero or computing the square root of negative numbers which are undefined (at least for real numbers).
Here come safe – that is total – definitions of these functions that return `Nothing`

for undefined cases:

```
safeRoot :: Double -> Maybe Double
safeRoot x
| x >= 0 = Just (sqrt x)
| otherwise = Nothing
safeReciprocal :: Double -> Maybe Double
safeReciprocal x
| x /= 0 = Just (1/x)
| otherwise = Nothing
```

As we have already learned the monadic `>>=`

operator allows to chain such function as in the following example:

```
safeRootReciprocal :: Double -> Maybe Double
safeRootReciprocal x = return x >>= safeReciprocal >>= safeRoot
```

This can be written even more terse as:

```
safeRootReciprocal :: Double -> Maybe Double
safeRootReciprocal = safeReciprocal >=> safeRoot
```

The use of the Kleisli 'fish' operator `>=>`

makes it more evident that we are actually aiming at a composition of the monadic functions `safeReciprocal`

and `safeRoot`

.

There are many predefined Monads available in the Haskell curated libraries and it's also possible to combine their effects by making use of `MonadTransformers`

. But that's a different story...

In computer programming, the interpreter pattern is a design pattern that specifies how to evaluate sentences in a language. The basic idea is to have a class for each symbol (terminal or nonterminal) in a specialized computer language. The syntax tree of a sentence in the language is an instance of the composite pattern and is used to evaluate (interpret) the sentence for a client.

In the section Singleton → Applicative we have already written a simple expression evaluator. From that section it should be obvious how easy the definition of evaluators and interpreters is in functional programming languages.

The main ingredients are:

- Algebraic Data Types (ADT) used to define the expression data type which is to be evaluated
- An evaluator function that uses pattern matching on the expression ADT
- 'implicit' threading of an environment

In the section on Singleton we have seen that some kind of 'implicit' threading of the environment can be already achieved with `Applicative Functors. We still had the environment as an explicit parameter of the eval function:

```
eval :: Num e => Exp e -> Env e -> e
```

but we could omit it in the pattern matching equations:

```
eval (Var x) = fetch x
eval (Val i) = pure i
eval (Add p q) = pure (+) <*> eval p <*> eval q
eval (Mul p q) = pure (*) <*> eval p <*> eval q
```

By using Monads the handling of the environment can be made even more implicit.

I'll demonstrate this with a slightly extended version of the evaluator. In the first step we extend the expression syntax to also provide let expressions and generic support for binary operators:

```
-- | a simple expression ADT
data Exp a =
Var String -- a variable to be looked up
| BinOp (BinOperator a) (Exp a) (Exp a) -- a binary operator applied to two expressions
| Let String (Exp a) (Exp a) -- a let expression
| Val a -- an atomic value
-- | a binary operator type
type BinOperator a = a -> a -> a
-- | the environment is just a list of mappings from variable names to values
type Env a = [(String, a)]
```

With this data type we can encode expressions like:

```
let x = 4+5
in 2*x
```

as:

```
Let "x" (BinOp (+) (Val 4) (Val 5))
(BinOp (*) (Val 2) (Var "x"))
```

In order to evaluate such expression we must be able to modify the environment at runtime to create a binding for the variable `x`

which will be referred to in the `in`

part of the expression.

Next we define an evaluator function that pattern matches the above expression ADT:

```
eval :: MonadReader (Env a) m => Exp a -> m a
eval (Val i) = return i
eval (Var x) = asks (fetch x)
eval (BinOp op e1 e2) = liftM2 op (eval e1) (eval e2)
eval (Let x e1 e2) = eval e1 >>= \v -> local ((x,v):) (eval e2)
```

Let's explore this dense code line by line.

```
eval :: MonadReader (Env a) m => Exp a -> m a
```

The most simple instance for `MonadReader`

is the partially applied function type `((->) env)`

.
Let's assume the compiler will choose this type as the `MonadReader`

instance. We can then rewrite the function signature as follows:

```
eval :: Exp a -> ((->) (Env a)) a -- expanding m to ((->) (Env a))
eval :: Exp a -> Env a -> a -- applying infix notation for (->)
```

This is exactly the signature we were using for the `Applicative`

eval function which matches our original intent to eval an expression of type `Exp a`

in an environment of type `Env a`

to a result of type `a`

.

```
eval (Val i) = return i
```

In this line we are pattern matching for a `(Val i)`

. The atomic value `i`

is `return`

ed, that is lifted to a value of the type `Env a -> a`

.

```
eval (Var x) = asks (fetch x)
```

`asks`

is a helper function that applies its argument `f :: env -> a`

(in our case `(fetch x)`

which looks up variable `x`

) to the environment. `asks`

is thus typically used to handle environment lookups:

```
asks :: (MonadReader env m) => (env -> a) -> m a
asks f = ask >>= return . f
```

Now to the next line handling the application of a binary operator:

```
eval (BinOp op e1 e2) = liftM2 op (eval e1) (eval e2)
```

`op`

is a binary function of type `a -> a -> a`

(typical examples are binary arithmetic functions like `+`

, `-`

, `*`

, `/`

).

We want to apply this operation on the two expressions `(eval e1)`

and `(eval e2)`

.
As these expressions both are to be executed within the same monadic context we have to use `liftM2`

to lift `op`

into this context:

```
-- | Promote a function to a monad, scanning the monadic arguments from
-- left to right. For example,
--
-- > liftM2 (+) [0,1] [0,2] = [0,2,1,3]
-- > liftM2 (+) (Just 1) Nothing = Nothing
--
liftM2 :: (Monad m) => (a1 -> a2 -> r) -> m a1 -> m a2 -> m r
liftM2 f m1 m2 = do { x1 <- m1; x2 <- m2; return (f x1 x2) }
```

The last step is the evaluation of `Let x e1 e2`

expressions like `Let "x" (Val 7) (BinOp (+) (Var "x") (Val 5))`

. To make this work we have to evaluate `e1`

and extend the environment by a binding of the variable `x`

to the result of that evaluation.
Then we have to evaluate `e2`

in the context of the extended environment:

```
eval (Let x e1 e2) = eval e1 >>= \v -> -- bind the result of (eval e1) to v
local ((x,v):) (eval e2) -- add (x,v) to the env, eval e2 in the extended env
```

The interesting part here is the helper function `local f m`

which applies `f`

to the environment and then executes `m`

against the (locally) changed environment.
Providing a locally modified environment as the scope of the evaluation of `e2`

is exactly what the `let`

binding intends:

```
-- | Executes a computation in a modified environment.
local :: (r -> r) -- ^ The function to modify the environment.
-> m a -- ^ @[email protected] to run in the modified environment.
-> m a
instance MonadReader r ((->) r) where
local f m = m . f
```

Now we can use `eval`

to evaluate our example expression:

```
interpreterDemo = do
putStrLn "Interpreter -> Reader Monad + ADTs + pattern matching"
let exp1 = Let "x"
(BinOp (+) (Val 4) (Val 5))
(BinOp (*) (Val 2) (Var "x"))
print $ runReader (eval exp1) env
-- an then in GHCi:
> interpreterDemo
18
```

By virtue of the `local`

function we used `MonadReader`

as if it provided modifiable state. So for many use cases that require only *local* state modifications its not required to use the somewhat more tricky `MonadState`

.

Writing the interpreter function with a `MonadState`

looks like follows:

```
eval1 :: (MonadState (Env a) m) => Exp a -> m a
eval1 (Val i) = return i
eval1 (Var x) = gets (fetch x)
eval1 (BinOp op e1 e2) = liftM2 op (eval1 e1) (eval1 e2)
eval1 (Let x e1 e2) = eval1 e1 >>= \v ->
modify ((x,v):) >>
eval1 e2
```

This section was inspired by ideas presented in Quick Interpreters with the Reader Monad.

In computing, aspect-oriented programming (AOP) is a programming paradigm that aims to increase modularity by allowing the separation of cross-cutting concerns. It does so by adding additional behavior to existing code (an advice) without modifying the code itself, instead separately specifying which code is modified via a "pointcut" specification, such as "log all function calls when the function's name begins with 'set'". This allows behaviors that are not central to the business logic (such as logging) to be added to a program without cluttering the code, core to the functionality.

In section
Interpreter -> Reader Monad
we specified an Interpreter of a simple expression language by defining a monadic `eval`

function:

```
eval :: Exp a -> Reader (Env a) a
eval (Var x) = asks (fetch x)
eval (Val i) = return i
eval (BinOp op e1 e2) = liftM2 op (eval e1) (eval e2)
eval (Let x e1 e2) = eval e1 >>= \v -> local ((x,v):) (eval e2)
```

Using the `Reader`

Monad allows to thread an environment through all recursive calls of `eval`

.

A typical extension to such an interpreter would be to provide a log mechanism that allows tracing of the actual sequence of all performed evaluation steps.

In Haskell the typical way to provide such a log is by means of the `Writer Monad`

.

But how to combine the capabilities of the `Reader`

monad code with those of the `Writer`

monad?

The answer is `MonadTransformer`

s: specialized types that allow us to stack two monads into a single one that shares the behavior of both.

In order to stack the `Writer`

monad on top of the `Reader`

we use the transformer type `WriterT`

:

```
-- adding a logging capability to the expression evaluator
eval :: Show a => Exp a -> WriterT [String] (Reader (Env a)) a
eval (Var x) = tell ["lookup " ++ x] >> asks (fetch x)
eval (Val i) = tell [show i] >> return i
eval (BinOp op e1 e2) = tell ["Op"] >> liftM2 op (eval e1) (eval e2)
eval (Let x e1 e2) = do
tell ["let " ++ x]
v <- eval e1
tell ["in"]
local ((x,v):) (eval e2)
```

The signature of `eval`

has been extended by Wrapping `WriterT [String]`

around `(Reader (Env a))`

. This denotes a Monad that combines a `Reader (Env a)`

with a `Writer [String]`

. `Writer [String]`

is a `Writer`

that maintains a list of strings as log.

The resulting Monad supports function of both `MonadReader`

and `MonadWriter`

typeclasses. As you can see in the equation for `eval (Var x)`

we are using `MonadWriter.tell`

for logging and `MonadReader.asks`

for obtaining the environment and compose both monadic actions by `>>`

:

```
eval (Var x) = tell ["lookup " ++ x] >> asks (fetch x)
```

In order to execute this stacked up monads we have to apply the `run`

functions of `WriterT`

and `Reader`

:

```
ghci> runReader (runWriterT (eval letExp)) [("pi",pi)]
(6.283185307179586,["let x","let y","Op","5.0","7.0","in","Op","lookup y","6.0","in","Op","lookup pi","lookup x"])
```

For more details on MonadTransformers please have a look at the following tutorials:

Monad Transformers step by step

What we have seen so far is that it possible to form Monad stacks that combine the functionality of the Monads involved: In a way a MonadTransformer adds capabilities that are cross-cutting to those of the underlying Monad.

In the following lines I want to show how MonadTransformers can be used to specify the formal semantics of Aspect Oriented Programming. I have taken the example from Mark P. Jones paper The Essence of AspectJ.

We start by defining a simple imperative language – MiniPascal:

```
-- | an identifier type
type Id = String
-- | Integer expressions
data IExp = Lit Int
| IExp :+: IExp
| IExp :*: IExp
| IExp :-: IExp
| IExp :/: IExp
| IVar Id deriving (Show)
-- | Boolean expressions
data BExp = T
| F
| Not BExp
| BExp :&: BExp
| BExp :|: BExp
| IExp :=: IExp
| IExp :<: IExp deriving (Show)
-- | Staments
data Stmt = Skip -- no op
| Id := IExp -- variable assignment
| Begin [Stmt] -- a sequence of statements
| If BExp Stmt Stmt -- an if statement
| While BExp Stmt -- a while loop
deriving (Show)
```

With this igredients its possible to write imperative programs like the following `while`

loop that sums up the natural numbers from 1 to 10:

```
-- an example program: the MiniPascal equivalent of `sum [1..10]`
program :: Stmt
program =
Begin [
"total" := Lit 0,
"count" := Lit 0,
While (IVar "count" :<: Lit 10)
(Begin [
"count" := (IVar "count" :+: Lit 1),
"total" := (IVar "total" :+: IVar "count")
])
]
```

We define the semantics of this language with an interpreter:

```
-- | the store used for variable assignments
type Store = Map Id Int
-- | evaluate numeric expression.
iexp :: MonadState Store m => IExp -> m Int
iexp (Lit n) = return n
iexp (e1 :+: e2) = liftM2 (+) (iexp e1) (iexp e2)
iexp (e1 :*: e2) = liftM2 (*) (iexp e1) (iexp e2)
iexp (e1 :-: e2) = liftM2 (-) (iexp e1) (iexp e2)
iexp (e1 :/: e2) = liftM2 div (iexp e1) (iexp e2)
iexp (IVar i) = getVar i
-- | evaluate logic expressions
bexp :: MonadState Store m => BExp -> m Bool
bexp T = return True
bexp F = return False
bexp (Not b) = fmap not (bexp b)
bexp (b1 :&: b2) = liftM2 (&&) (bexp b1) (bexp b2)
bexp (b1 :|: b2) = liftM2 (||) (bexp b1) (bexp b2)
bexp (e1 :=: e2) = liftM2 (==) (iexp e1) (iexp e2)
bexp (e1 :<: e2) = liftM2 (<) (iexp e1) (iexp e2)
-- | evaluate statements
stmt :: MonadState Store m => Stmt -> m ()
stmt Skip = return ()
stmt (i := e) = do x <- iexp e; setVar i x
stmt (Begin ss) = mapM_ stmt ss
stmt (If b t e) = do
x <- bexp b
if x then stmt t
else stmt e
stmt (While b t) = loop
where loop = do
x <- bexp b
when x $ stmt t >> loop
-- | a variable assignments updates the store (which is maintained in the state)
setVar :: (MonadState (Map k a) m, Ord k) => k -> a -> m ()
setVar i x = do
store <- get
put (Map.insert i x store)
-- | lookup a variable in the store. return 0 if no value is found
getVar :: MonadState Store m => Id -> m Int
getVar i = do
s <- get
case Map.lookup i s of
Nothing -> return 0
(Just v) -> return v
-- | evaluate a statement
run :: Stmt -> Store
run s = execState (stmt s) (Map.fromList [])
-- and then in GHCi:
ghci> run program
fromList [("count",10),("total",55)]
```

So far this is nothing special, just a minimal interpreter for an imperative language. Side effects in form of variable assignments are modelled with an environment that is maintained in a state monad.

In the next step we want to extend this language with features of aspect oriented programming in the style of *AspectJ*: join points, point cuts, and advices.

To keep things simple we will specify only two types of joint points: variable assignment and variable reading:

```
data JoinPointDesc = Get Id | Set Id
```

`Get i`

describes a join point at which the variable `i`

is read, while `Set i`

described a join point at which
a value is assigned to the variable `i`

.

Following the concepts of ApectJ pointcut expressions are used to describe sets of join points. The abstract syntax for pointcuts is as follows:

```
data PointCut = Setter -- the pointcut of all join points at which a variable is being set
| Getter -- the pointcut of all join points at which a variable is being read
| AtVar Id -- the point cut of all join points at which a the variable is being set or read
| NotAt PointCut -- not a
| PointCut :||: PointCut -- a or b
| PointCut :&&: PointCut -- a and b
```

For example this syntax can be used to specify the pointcut of
all join points at which the variable `x`

is set:

```
(Setter :&&: AtVar "x")
```

The following function computes whether a `PointCut`

contains a given `JoinPoint`

:

```
includes :: PointCut -> (JoinPointDesc -> Bool)
includes Setter (Set i) = True
includes Getter (Get i) = True
includes (AtVar i) (Get j) = i == j
includes (AtVar i) (Set j) = i == j
includes (NotAt p) d = not (includes p d)
includes (p :||: q) d = includes p d || includes q d
includes (p :&&: q) d = includes p d && includes q d
includes _ _ = False
```

In AspectJ aspect oriented extensions to a program are described using the notion of advices. We follow the same design here: each advice includes a pointcut to specify the join points at which the advice should be used, and a statement (in MiniPascal syntax) to specify the action that should be performed at each matching join point.

In AspectPascal we only support two kinds of advice: `Before`

, which will be executed on entry to a join point, and
`After`

which will be executed on the exit from a join point:

```
data Advice = Before PointCut Stmt
| After PointCut Stmt
```

This allows to define `Advice`

s like the following:

```
-- the countSets Advice traces each setting of a variable and increments the counter "countSet"
countSets = After (Setter :&&: NotAt (AtVar "countSet") :&&: NotAt (AtVar "countGet"))
("countSet" := (IVar "countSet" :+: Lit 1))
-- the countGets Advice traces each lookup of a variable and increments the counter "countGet"
countGets = After (Getter :&&: NotAt (AtVar "countSet") :&&: NotAt (AtVar "countGet"))
("countGet" := (IVar "countGet" :+: Lit 1))
```

The rather laborious PointCut definition is used to select access to all variable apart from `countGet`

and `countSet`

.
This is required as the action part of the `Advices`

are normal MiniPascal statements that are executed by the same interpreter as the main program which is to be extended by advices. If those filters were not present execution of those advices would result in non-terminating loops, as the action statements also access variables.

A complete AspectPascal program will now consist of a `stmt`

(the original program) plus a list of `advices`

that should be executed to implement the cross-cutting aspects:

```
-- | Aspects are just a list of Advices
type Aspects = [Advice]
```

In order to extend our interpreter to execute additional behaviour decribed in `advices`

we will have to provide all evaluating functions with access to the `Aspects`

.
As the `Aspects`

will not be modified at runtime the typical solution would be to provide them by a `Reader Aspects`

monad.
We already have learnt that we can use a MonadTransformer to stack our existing `State`

monad with a `Reader`

monad. The respective Transformer is `ReaderT`

.
We thus extend the signature of the evaluation functions accordingly, eg:

```
-- from:
iexp :: MonadState Store m => IExp -> m Int
-- to:
iexp :: MonadState Store m => IExp -> ReaderT Aspects m Int
```

Apart from extendig the signatures we have to modify all places where variables are accessed to apply the matching advices.
So for instance in the equation for `iexp (IVar i)`

we specify that `(getVar i)`

should be executed with applying all advices that match the read access to variable `i`

– that is `(Get i)`

by writing:

```
iexp (IVar i) = withAdvice (Get i) (getVar i)
```

So the complete definition of `iexp`

is:

```
iexp :: MonadState Store m => IExp -> ReaderT Aspects m Int
iexp (Lit n) = return n
iexp (e1 :+: e2) = liftM2 (+) (iexp e1) (iexp e2)
iexp (e1 :*: e2) = liftM2 (*) (iexp e1) (iexp e2)
iexp (e1 :-: e2) = liftM2 (-) (iexp e1) (iexp e2)
iexp (e1 :/: e2) = liftM2 div (iexp e1) (iexp e2)
iexp (IVar i) = withAdvice (Get i) (getVar i)
```

[...] if

`c`

is a computation corresponding to some join point with description`d`

, then`withAdvice d c`

wraps the execution of`c`

with the execution of the appropriate Before and After advice, if any:

```
withAdvice :: MonadState Store m => JoinPointDesc -> ReaderT Aspects m a -> ReaderT Aspects m a
withAdvice d c = do
aspects <- ask -- obtaining the Aspects from the Reader monad
mapM_ stmt (before d aspects) -- execute the statements of all Before advices
x <- c -- execute the actual business logic
mapM_ stmt (after d aspects) -- execute the statements of all After advices
return x
-- collect the statements of Before and After advices matching the join point
before, after :: JoinPointDesc -> Aspects -> [Stmt]
before d as = [s | Before c s <- as, includes c d]
after d as = [s | After c s <- as, includes c d]
```

In the same way the equation for variable assignment `stmt (i := e)`

we specify that `(setVar i x)`

should be executed with applying all advices that match the write access to variable `i`

– that is `(Set i)`

by noting:

```
stmt (i := e) = do x <- iexp e; withAdvice (Set i) (setVar i x)
```

The complete implementation for `stmt`

then looks like follows:

```
stmt :: MonadState Store m => Stmt -> ReaderT Aspects m ()
stmt Skip = return ()
stmt (i := e) = do x <- iexp e; withAdvice (Set i) (setVar i x)
stmt (Begin ss) = mapM_ stmt ss
stmt (If b t e) = do
x <- bexp b
if x then stmt t
else stmt e
stmt (While b t) = loop
where loop = do
x <- bexp b
when x $ stmt t >> loop
```

Finally we have to extend `run`

function to properly handle the monad stack:

```
run :: Aspects -> Stmt -> Store
run a s = execState (runReaderT (stmt s) a) (Map.fromList [])
-- and then in GHCi:
ghci> run [] program
fromList [("count",10),("total",55)]
ghci> run [countSets] program
fromList [("count",10),("countSet",22),("total",55)]
ghci> run [countSets, countGets] program
fromList [("count",10),("countGet",41),("countSet",22),("total",55)]
```

So executing the program with an empty list of advices yields the same result as executing the program with initial interpreter. Once we execute the program with the advices `countGets`

and `countSets`

the resulting map contains values for the variables `countGet`

and `countSet`

which have been incremented by the statements of both advices.

We have utilized Monad Transformers to extend our original interpreter in a minamally invasive way, to provide a formal and executable semantics for a simple aspect-oriented language in the style of AspectJ.

In software engineering, the composite pattern is a partitioning design pattern. The composite pattern describes a group of objects that is treated the same way as a single instance of the same type of object. The intent of a composite is to "compose" objects into tree structures to represent part-whole hierarchies. Implementing the composite pattern lets clients treat individual objects and compositions uniformly. (Quoted from Wikipedia)

A typical example for the composite pattern is the hierarchical grouping of test cases to TestSuites in a testing framework. Take for instance the following class diagram from the JUnit cooks tour which shows how JUnit applies the Composite pattern to group `TestCases`

to `TestSuites`

while both of them implement the `Test`

interface:

In Haskell we could model this kind of hierachy with an algebraic data type (ADT):

```
-- the composite data structure: a Test can be either a single TestCase
-- or a TestSuite holding a list of Tests
data Test = TestCase TestCase
| TestSuite [Test]
-- a test case produces a boolean when executed
type TestCase = () -> Bool
```

The function `run`

as defined below can either execute a single TestCase or a composite TestSuite:

```
-- execution of a Test.
run :: Test -> Bool
run (TestCase t) = t () -- evaluating the TestCase by applying t to ()
run (TestSuite l) = all (True ==) (map run l) -- running all tests in l and return True if all tests pass
-- a few most simple test cases
t1 :: Test
t1 = TestCase (\() -> True)
t2 :: Test
t2 = TestCase (\() -> True)
t3 :: Test
t3 = TestCase (\() -> False)
-- collecting all test cases in a TestSuite
ts = TestSuite [t1,t2,t3]
```

As run is of type `run :: Test -> Bool`

we can use it to execute single `TestCases`

or complete `TestSuites`

.
Let's try it in GHCI:

```
ghci> run t1
True
ghci> run ts
False
```

In order to aggregate TestComponents we follow the design of JUnit and define a function `addTest`

. Adding two atomic Tests will result in a TestSuite holding a list with the two Tests. If a Test is added to a TestSuite, the test is added to the list of tests of the suite. Adding TestSuites will merge them.

```
-- adding Tests
addTest :: Test -> Test -> Test
addTest [email protected](TestCase _) [email protected](TestCase _) = TestSuite [t1,t2]
addTest [email protected](TestCase _) (TestSuite list) = TestSuite ([t1] ++ list)
addTest (TestSuite list) [email protected](TestCase _) = TestSuite (list ++ [t2])
addTest (TestSuite l1) (TestSuite l2) = TestSuite (l1 ++ l2)
```

If we take a closer look at `addTest`

we will see that it is a associative binary operation on the set of `Test`

s.

In mathemathics a set with an associative binary operation is a Semigroup.

We can thus make our type `Test`

an instance of the type class `Semigroup`

with the following declaration:

```
instance Semigroup Test where
(<>) = addTest
```

What's not visible from the JUnit class diagram is how typical object oriented implementations will have to deal with null-references. That is the implementations would have to make sure that the methods `run`

and `addTest`

will handle empty references correctly.
With Haskells algebraic data types we would rather make this explicit with a dedicated `Empty`

element.
Here are the changes we have to add to our code:

```
-- the composite data structure: a Test can be Empty, a single TestCase
-- or a TestSuite holding a list of Tests
data Test = Empty
| TestCase TestCase
| TestSuite [Test]
-- execution of a Test.
run :: Test -> Bool
run Empty = True -- empty tests will pass
run (TestCase t) = t () -- evaluating the TestCase by applying t to ()
--run (TestSuite l) = foldr ((&&) . run) True l
run (TestSuite l) = all (True ==) (map run l) -- running all tests in l and return True if all tests pass
-- addTesting Tests
addTest :: Test -> Test -> Test
addTest Empty t = t
addTest t Empty = t
addTest [email protected](TestCase _) [email protected](TestCase _) = TestSuite [t1,t2]
addTest [email protected](TestCase _) (TestSuite list) = TestSuite ([t1] ++ list)
addTest (TestSuite list) [email protected](TestCase _) = TestSuite (list ++ [t2])
addTest (TestSuite l1) (TestSuite l2) = TestSuite (l1 ++ l2)
```

From our additions it's obvious that `Empty`

is the identity element of the `addTest`

function. In Algebra a Semigroup with an identity element is called *Monoid*:

In abstract algebra, [...] a monoid is an algebraic structure with a single associative binary operation and an identity element. Quoted from Wikipedia

With haskell we can declare `Test`

as an instance of the `Monoid`

type class by defining:

```
instance Monoid Test where
mempty = Empty
```

We can now use all functions provided by the `Monoid`

type class to work with our `Test`

:

```
compositeDemo = do
print $ run $ t1 <> t2
print $ run $ t1 <> t2 <> t3
```

We can also use the function `mconcat :: Monoid a => [a] -> a`

on a list of `Tests`

: mconcat composes a list of Tests into a single Test. That's exactly the mechanism of forming a TestSuite from atomic TestCases.

```
compositeDemo = do
print $ run $ mconcat [t1,t2]
print $ run $ mconcat [t1,t2,t3]
```

This particular feature of `mconcat :: Monoid a => [a] -> a`

to condense a list of Monoids to a single Monoid can be used to drastically simplify the design of our test framework.

We need just one more hint from our mathematician friends:

Functions are monoids if they return monoids Quoted from blog.ploeh.dk

Currently our `TestCases`

are defined as functions yielding boolean values:

```
type TestCase = () -> Bool
```

If `Bool`

was a `Monoid`

we could use `mconcat`

to form test suite aggregates. `Bool`

in itself is not a Monoid; but together with a binary associative operation like `(&&)`

or `(||)`

it will form a Monoid.

The intuitive semantics of a TestSuite is that a whole Suite is "green" only when all enclosed TestCases succeed. That is the conjunction of all TestCases must return `True`

.

So we are looking for the Monoid of boolean values under conjunction `(&&)`

. In Haskell this Monoid is called `All`

):

```
-- | Boolean monoid under conjunction ('&&').
-- >>> getAll (All True <> mempty <> All False)
-- False
-- >>> getAll (mconcat (map (\x -> All (even x)) [2,4,6,7,8]))
-- False
newtype All = All { getAll :: Bool }
instance Semigroup All where
(<>) = coerce (&&)
instance Monoid All where
mempty = All True
```

Making use of `All`

our improved definition of TestCases is as follows:

```
type SmartTestCase = () -> All
```

Now our test cases do not directly return a boolean value but an `All`

wrapper, which allows automatic conjunction of test results to a single value.
Here are our redefined TestCases:

```
tc1 :: SmartTestCase
tc1 () = All True
tc2 :: SmartTestCase
tc2 () = All True
tc3 :: SmartTestCase
tc3 () = All False
```

We now implement a new evaluation function `run'`

which evaluates a `SmartTestCase`

(which may be either an atomic TestCase or a TestSuite assembled by `mconcat`

) to a single boolean result.

```
run' :: SmartTestCase -> Bool
run' tc = getAll $ tc ()
```

This version of `run`

is much simpler than the original and we can completely avoid the rather laborious `addTest`

function. We also don't need any composite type `Test`

.
By just sticking to the Haskell built-in type classes we achieve cleanly designed functionality with just a few lines of code.

```
compositeDemo = do
-- execute a single test case
print $ run' tc1
--- execute a complex test suite
print $ run' $ mconcat [tc1,tc2]
print $ run' $ mconcat [tc1,tc2,tc3]
```

For more details on Composite as a Monoid please refer to the following blog: Composite as Monoid

[...] the visitor design pattern is a way of separating an algorithm from an object structure on which it operates. A practical result of this separation is the ability to add new operations to existent object structures without modifying the structures. It is one way to follow the open/closed principle. (Quoted from Wikipedia)

In functional languages - and Haskell in particular - we have a whole armada of tools serving this purpose:

- higher order functions like map, fold, filter and all their variants allow to "visit" lists
- The Haskell type classes
`Functor`

,`Foldable`

,`Traversable`

, etc. provide a generic framework to allow visiting any algebraic datatype by just deriving one of these type classes.

```
-- we are re-using the Exp data type from the Singleton example
-- and transform it into a Foldable type:
instance Foldable Exp where
foldMap f (Val x) = f x
foldMap f (Add x y) = foldMap f x `mappend` foldMap f y
foldMap f (Mul x y) = foldMap f x `mappend` foldMap f y
filterF :: Foldable f => (a -> Bool) -> f a -> [a]
filterF p = foldMap (\a -> if p a then [a] else [])
visitorDemo = do
let exp = Mul (Add (Val 3) (Val 2))
(Mul (Val 4) (Val 6))
putStr "size of exp: "
print $ length exp
putStrLn "filter even numbers from tree"
print $ filterF even exp
```

By virtue of the instance declaration Exp becomes a Foldable instance an can be used with arbitrary functions defined on Foldable like `length`

in the example.

`foldMap`

can for example be used to write a filtering function `filterF`

that collects all elements matching a predicate into a list.

[...] the iterator pattern is a design pattern in which an iterator is used to traverse a container and access the container's elements. The iterator pattern decouples algorithms from containers; in some cases, algorithms are necessarily container-specific and thus cannot be decoupled. Quoted from Wikipedia

The most generic type class enabling iteration over algebraic data types is `Traversable`

as it allows combinations of `map`

and `fold`

operations.
We are re-using the `Exp`

type from earlier examples to show what's needed for enabling iteration in functional languages.

```
instance Functor Exp where
fmap f (Var x) = Var x
fmap f (Val a) = Val $ f a
fmap f (Add x y) = Add (fmap f x) (fmap f y)
fmap f (Mul x y) = Mul (fmap f x) (fmap f y)
instance Traversable Exp where
traverse g (Var x) = pure $ Var x
traverse g (Val x) = Val <$> g x
traverse g (Add x y) = Add <$> traverse g x <*> traverse g y
traverse g (Mul x y) = Mul <$> traverse g x <*> traverse g y
```

With this declaration we can traverse an `Exp`

tree:

```
iteratorDemo = do
putStrLn "Iterator -> Traversable"
let exp = Mul (Add (Val 3) (Val 1))
(Mul (Val 2) (Var "pi"))
env = [("pi", pi)]
print $ traverse (\x c -> if even x then [x] else [2*x]) exp 0
```

In this example we are touching all (nested) `Val`

elements and multiply all odd values by 2.

Compared with `Foldable`

or `Functor`

the declaration of a `Traversable`

instance looks a bit intimidating. In particular the type signature of `traverse`

:

```
traverse :: (Traversable t, Applicative f) => (a -> f b) -> t a -> f (t b)
```

looks like quite a bit of over-engineering for simple traversals as in the above example.

In oder to explain the real power of the `Traversable`

type class we will look at a more sophisticated example in this section. This example was taken from the paper
The Essence of the Iterator Pattern.

The Unix utility `wc`

is a good example for a traversal operation that performs several different tasks while traversing its input:

```
echo "counting lines, words and characters in one traversal" | wc
1 8 54
```

The output simply means that our input has 1 line, 8 words and a total of 54 characters.
Obviously an efficients implementation of `wc`

will accumulate the three counters for lines, words and characters in a single pass of the input and will not run three iterations to compute the three counters separately.

Here is a Java implementation:

```
private static int[] wordCount(String str) {
int nl=0, nw=0, nc=0; // number of lines, number of words, number of characters
boolean readingWord = false; // state information for "parsing" words
for (Character c : asList(str)) {
nc++; // count just any character
if (c == '\n') {
nl++; // count only newlines
}
if (c == ' ' || c == '\n' || c == '\t') {
readingWord = false; // when detecting white space, signal end of word
} else if (readingWord == false) {
readingWord = true; // when switching from white space to characters, signal new word
nw++; // increase the word counter only once while in a word
}
}
return new int[]{nl,nw,nc};
}
private static List<Character> asList(String str) {
return str.chars().mapToObj(c -> (char) c).collect(Collectors.toList());
}
```

Please note that the `for (Character c : asList(str)) {...}`

notation is just syntactic sugar for

```
for (Iterator<Character> iter = asList(str).iterator(); iter.hasNext();) {
Character c = iter.next();
...
}
```

For efficiency reasons this solution may be okay, but from a design perspective the solution lacks clarity as the required logic for accumulating the three counters is heavily entangled within one code block. Just imagine how the complexity of the for-loop will increase once we have to add new features like counting bytes, counting white space or counting maximum line width.

So we would like to be able to isolate the different counting algorithms (*separation of concerns*) and be able to combine them in a way that provides efficient one-time traversal.

We start with the simple task of character counting:

```
type Count = Const (Sum Integer)
count :: a -> Count b
count _ = Const 1
cciBody :: Char -> Count a
cciBody = count
cci :: String -> Count [a]
cci = traverse cciBody
-- and then in ghci:
> cci "hello world"
Const (Sum {getSum = 11})
```

For each character we just emit a `Const 1`

which are elements of type `Const (Sum Integer)`

.
As `(Sum Integer)`

is the monoid of Integers under addition, this design allows automatic summation over all collected `Const`

values.

The next step of counting newlines looks similar:

```
-- return (Sum 1) if true, else (Sum 0)
test :: Bool -> Sum Integer
test b = Sum $ if b then 1 else 0
-- use the test function to emit (Sum 1) only when a newline char is detected
lciBody :: Char -> Count a
lciBody c = Const $ test (c == '\n')
-- define the linecount using traverse
lci :: String -> Count [a]
lci = traverse lciBody
-- and the in ghci:
> lci "hello \n world"
Const (Sum {getSum = 1})
```

Now let's try to combine character counting and line counting.
In order to match the type declaration for `traverse`

:

```
traverse :: (Traversable t, Applicative f) => (a -> f b) -> t a -> f (t b)
```

We had to define `cciBody`

and `lciBody`

so that their return types are `Applicative Functors`

.
The good news is that the product of two `Applicatives`

is again an `Applicative`

(the same holds true for Composition of `Applicatives`

).
With this knowledge we can now use `traverse`

to use the product of `cciBody`

and `lciBody`

:

```
import Data.Functor.Product -- Product of Functors
-- define infix operator for building a Functor Product
(<#>) :: (Functor m, Functor n) => (a -> m b) -> (a -> n b) -> (a -> Product m n b)
(f <#> g) y = Pair (f y) (g y)
-- use a single traverse to apply the Product of cciBody and lciBody
clci :: String -> Product Count Count [a]
clci = traverse (cciBody <#> lciBody)
-- and then in ghci:
> clci "hello \n world"
Pair (Const (Sum {getSum = 13})) (Const (Sum {getSum = 1}))
```

So we have achieved our aim of separating line counting and character counting in separate functions while still being able to apply them in only one traversal.

The only piece missing is the word counting. This is a bit tricky as we can not just increase a counter by looking at each single character but we have to take into account the status of the previously read character as well:

- If the previous character was non-whitespace and the current is also non-whitespace we are still reading the same word and don't increment the word count.
- If the previous character was non-whitespace and the current is a whitespace character the last word was ended but we don't increment the word count.
- If the previous character was whitespace and the current is also whitespace we are still reading whitespace between words and don't increment the word count.
- If the previous character was whitespace and the current is a non-whitespace character the next word has started and we increment the word count.

Keeping track of the state of the last character could be achieved by using a state monad (and wrapping it as an Applicative Functor to make it compatible with `traverse`

). The actual code for this solution is kept in the sourcecode for this section (functions `wciBody'`

and `wci'`

in particular). But as this approach is a bit noisy I'm presenting a simpler solution suggested by Noughtmare.

In his approach we'll define a data structure that will keep track of the changes between whitespace and non-whitespace:

```
data SepCount = SC Bool Bool Integer
deriving Show
mkSepCount :: (a -> Bool) -> a -> SepCount
mkSepCount pred x = SC p p (if p then 0 else 1)
where
p = pred x
getSepCount :: SepCount -> Integer
getSepCount (SC _ _ n) = n
```

We then define the semantics for `(<>)`

which implements the actual bookkeeping needed when `mappend`

ing two `SepCount`

items:

```
instance Semigroup SepCount where
(SC l0 r0 n) <> (SC l1 r1 m) = SC l0 r1 x where
x | not r0 && not l1 = n + m - 1
| otherwise = n + m
```

Based on these definitions we can then implement the wordcounting as follows:

```
wciBody :: Char -> Const (Maybe SepCount) Integer
wciBody = Const . Just . mkSepCount isSpace where
isSpace :: Char -> Bool
isSpace c = c == ' ' || c == '\n' || c == '\t'
-- using traverse to count words in a String
wci :: String -> Const (Maybe SepCount) [Integer]
wci = traverse wciBody
-- Forming the Product of character counting, line counting and word counting
-- and performing a one go traversal using this Functor product
clwci :: String -> (Product (Product Count Count) (Const (Maybe SepCount))) [Integer]
clwci = traverse (cciBody <#> lciBody <#> wciBody)
-- extracting the actual Integer value from a `Const (Maybe SepCount) a` expression
extractCount :: Const (Maybe SepCount) a -> Integer
extractCount (Const (Just sepCount)) = getSepCount sepCount
-- the actual wordcount implementation.
-- for any String a triple of linecount, wordcount, charactercount is returned
wc :: String -> (Integer, Integer, Integer)
wc str =
let raw = clwci str
cc = coerce $ pfst (pfst raw)
lc = coerce $ psnd (pfst raw)
wc = extractCount (psnd raw)
in (lc,wc,cc)
```

This sections was meant to motivate the usage of the `Traversable`

type. Of course the word count example could be solved in much simpler ways. Here is one solution suggested by NoughtMare.

We simply use `foldMap`

to perform a map / reduce based on our already defined `cciBody`

, `lciBody`

and `wciBody`

functions. As `clwci''`

now returns a simple tuple instead of the more clumsy `Product`

type also the final wordcound function `wc''`

now looks way simpler:

```
clwci'' :: Foldable t => t Char -> (Count [a], Count [a], Const (Maybe SepCount) Integer)
clwci'' = foldMap (\x -> (cciBody x, lciBody x, wciBody x))
wc'' :: String -> (Integer, Integer, Integer)
wc'' str =
let (rawCC, rawLC, rawWC) = clwci'' str
cc = coerce rawCC
lc = coerce rawLC
wc = extractCount rawWC
in (lc,wc,cc)
```

As map / reduce with `foldMap`

is such a powerful tool I've written a dedicated section on this topic further down in this study.

If you've ever used Unix pipes, you'll understand the importance and flexibility of composing small reusable programs to get powerful and emergent behaviors. Similarly, if you program functionally, you'll know how cool it is to compose a bunch of small reusable functions into a fully featured program.

Category theory codifies this compositional style into a design pattern, the category. Quoted from HaskellForAll

In most of the patterns and type classes discussed so far we have seen a common theme: providing means to compose behaviour and structure is one of the most important tools to design complex software by combining simpler components.

Function composition is a powerful and elegant tool to compose complex functionality out of simpler building blocks. We already have seen several examples of it in the course of this study.
Functions can be composed by using the binary `(.)`

operator:

```
ghci> :type (.)
(.) :: (b -> c) -> (a -> b) -> a -> c
```

It is defined as:

```
(f . g) x = f (g x)
```

This operator can be used to combine simple functions to awesome one-liners (and of course much more useful stuff):

```
ghci> product . filter odd . map length . words . reverse $ "function composition is awesome"
77
```

Function composition is associative `(f . g) . h = f . (g . h)`

:

```
ghci> (((^2) . length) . words) "hello world"
4
ghci> ((^2) . (length . words)) "hello world"
4
```

And composition has a neutral (or identity) element `id`

so that `f . id = id . f`

:

```
ghci> (length . id) [1,2,3]
3
ghci> (id . length) [1,2,3]
3
```

The definitions of `(.)`

and `id`

plus the laws of associativity and identity match exactly the definition of a category:

In mathematics, a category [...] is a collection of "objects" that are linked by "arrows". A category has two basic properties: the ability to compose the arrows associatively and the existence of an identity arrow for each object.

In Haskell a category is defined as as a type class:

```
class Category cat where
-- | the identity morphism
id :: cat a a
-- | morphism composition
(.) :: cat b c -> cat a b -> cat a c
```

Please note: The name

`Category`

may be a bit misleading, since this type class cannot represent arbitrary categories, but only categories whose objects are objects of`Hask`

, the category of Haskell types.

Instances of `Category`

should satisfy that `(.)`

and `id`

form a Monoid – that is `id`

should be the identity of `(.)`

and `(.)`

should be associative:

```
f . id = f -- (right identity)
id . f = f -- (left identity)
f . (g . h) = (f . g) . h -- (associativity)
```

As function composition fulfills these category laws the function type constructor `(->)`

can be defined as an instance of the category type class:

```
instance Category (->) where
id = GHC.Base.id
(.) = (GHC.Base..)
```

In the section on the Maybe Monad we have seen that monadic operations can be chained with the Kleisli operator `>=>`

:

```
safeRoot :: Double -> Maybe Double
safeRoot x
| x >= 0 = Just (sqrt x)
| otherwise = Nothing
safeReciprocal :: Double -> Maybe Double
safeReciprocal x
| x /= 0 = Just (1/x)
| otherwise = Nothing
safeRootReciprocal :: Double -> Maybe Double
safeRootReciprocal = safeReciprocal >=> safeRoot
```

The operator `<=<`

just flips the arguments of `>=>`

and thus provides right-to-left composition.
When we compare the signature of `<=<`

with the signature of `.`

we notice the similarity of both concepts:

```
(.) :: (b -> c) -> (a -> b) -> a -> c
(<=<) :: Monad m => (b -> m c) -> (a -> m b) -> a -> m c
```

Even the implementation of `<=<`

is quite similar to the definition of `.`

```
(f . g) x = f (g x)
(f <=< g) x = f =<< (g x)
```

The essential diffenerce is that `<=<`

maintains a monadic structure when producing its result.

Next we compare signatures of `id`

and its monadic counterpart `return`

:

```
id :: (a -> a)
return :: (Monad m) => (a -> m a)
```

Here again `return`

always produces a monadic structure.

So the category for Monads can simply be defined as:

```
-- | Kleisli arrows of a monad.
newtype Kleisli m a b = Kleisli { runKleisli :: a -> m b }
instance Monad m => Category (Kleisli m) where
id = Kleisli return
(Kleisli f) . (Kleisli g) = Kleisli (f <=< g)
```

So if monadic actions form a category we expect that the law of identity and associativity hold:

```
return <=< f = f -- left identity
f <=< return = f -- right identity
(f <=< g) <=< h = f <=< (g <=< h) -- associativity
```

Let's try to prove it by applying some equational reasoning.
First we take the definition of `<=<`

: `(f <=< g) x = f =<< (g x)`

to expand the above equations:

```
-- 1. left identity
return <=< f = f -- left identity (to be proven)
(return <=< f) x = f x -- eta expand
return =<< (f x) = f x -- expand <=< by above definition
return =<< f = f -- eta reduce
f >>= return = f -- replace =<< with >>= and flip arguments
-- 2 right identity
f <=< return = f -- right identity (to be proven)
(f <=< return) x = f x -- eta expand
f =<< (return x) = f x -- expand <=< by above definition
return x >>= f = f x -- replace =<< with >>= and flip arguments
-- 3. associativity
(f <=< g) <=< h = f <=< (g <=< h) -- associativity (to be proven)
((f <=< g) <=< h) x = (f <=< (g <=< h)) x -- eta expand
(f <=< g) =<< (h x) = f =<< ((g <=< h) x) -- expand outer <=< on both sides
(\y -> (f <=< g) y) =<< h x = f =<< ((g <=< h) x) -- eta expand on left hand side
(\y -> f =<< (g y)) =<< h x = f =<< ((g <=< h) x) -- expand inner <=< on the lhs
(\y -> f =<< (g y)) =<< h x = f =<< (g =<< (h x)) -- expand inner <=< on the rhs
h x >>= (\y -> f =<< (g y)) = f =<< (g =<< (h x)) -- replace outer =<< with >>= and flip arguments on lhs
h x >>= (\y -> g y >>= f) = f =<< (g =<< (h x)) -- replace inner =<< with >>= and flip arguments on lhs
h x >>= (\y -> g y >>= f) = (g =<< (h x)) >>= f -- replace outer =<< with >>= and flip arguments on rhs
h x >>= (\y -> g y >>= f) = ((h x) >>= g) >>= f -- replace inner =<< with >>= and flip arguments on rhs
h >>= (\y -> g y >>= f) = (h >>= g) >>= f -- eta reduce
```

So we have transformed our three formulas to the following form:

```
f >>= return = f
return x >>= f = f x
h >>= (\y -> g y >>= f) = (h >>= g) >>= f
```

These three equations are equivalent to the Monad Laws, which all Monad instances are required to satisfy:

```
m >>= return = m
return a >>= k = k a
m >>= (\x -> k x >>= h) = (m >>= k) >>= h
```

So by virtue of this equivalence any Monad that satisfies the Monad laws automatically satisfies the Category laws.

If you have ever wondered where those monad laws came from, now you know! They are just the category laws in disguise. Consequently, every new Monad we define gives us a category for free!

Quoted from The Category Design Pattern

Category theory codifies [the] compositional style into a design pattern, the category. Moreover, category theory gives us a precise prescription for how to create our own abstractions that follow this design pattern: the category laws. These laws differentiate category theory from other design patterns by providing rigorous criteria for what does and does not qualify as compositional.

One could easily dismiss this compositional ideal as just that: an ideal, something unsuitable for "real-world" scenarios. However, the theory behind category theory provides the meat that shows that this compositional ideal appears everywhere and can rise to the challenge of > messy problems and complex business logic.

Quoted from The Category Design Pattern

In software engineering, a fluent interface [...] is a method for designing object oriented APIs based extensively on method chaining with the goal of making the readability of the source code close to that of ordinary written prose, essentially creating a domain-specific language within the interface.

The Builder Pattern is a typical example for a fluent API. The following short Java snippet show the essential elements:

- creating a builder instance
- invoking a sequence of mutators
`with...`

on the builder instance - finally calling
`build()`

to let the Builder create an object

```
ConfigBuilder builder = new ConfigBuilder();
Config config = builder
.withProfiling() // Add profiling
.withOptimization() // Add optimization
.build();
}
```

The interesting point is that all the `with...`

methods are not implemented as `void`

method but instead all return the Builder instance, which thus allows to fluently chain the next `with...`

call.

Let's try to recreate this fluent chaining of calls in Haskell.
We start with a configuration type `Config`

that represents a set of option strings (`Options`

):

```
type Options = [String]
newtype Config = Conf Options deriving (Show)
```

Next we define a function `configBuilder`

which takes `Options`

as input and returns a `Config`

instance:

```
configBuilder :: Options -> Config
configBuilder options = Conf options
-- we can use this to construct a Config instance from a list of Option strings:
ghci> configBuilder ["-O2", "-prof"]
Conf ["-O2","-prof"]
```

In order to allow chaining of the `with...`

functions they always must return a new `Options -> Config`

function. So for example `withProfiling`

would have the following signature:

```
withProfiling :: (Options -> Config) -> (Options -> Config)
```

This signature is straightforward but the implementation needs some thinking: we take a function `builder`

of type `Options -> Config`

as input and must return a new function of the same type that will use the same builder but will add profiling options to the `Options`

parameter `opts`

:

```
withProfiling builder = \opts -> builder (opts ++ ["-prof", "-auto-all"])
```

HLint tells us that this can be written more terse as:

```
withProfiling builder opts = builder (opts ++ ["-prof", "-auto-all"])
```

In order to keep notation dense we introduce a type alias for the function type `Options -> Config`

:

```
type ConfigBuilder = Options -> Config
```

With this shortcut we can implement the other `with...`

functions as:

```
withWarnings :: ConfigBuilder -> ConfigBuilder
withWarnings builder opts = builder (opts ++ ["-Wall"])
withOptimization :: ConfigBuilder -> ConfigBuilder
withOptimization builder opts = builder (opts ++ ["-O2"])
withLogging :: ConfigBuilder -> ConfigBuilder
withLogging builder opts = builder (opts ++ ["-logall"])
```

The `build()`

function is also quite straightforward. It constructs the actual `Config`

instance by invoking a given `ConfigBuilder`

on an empty list:

```
build :: ConfigBuilder -> Config
build builder = builder mempty
-- now we can use it in ghci:
ghci> print (build (withOptimization (withProfiling configBuilder)))
Conf ["-O2","-prof","-auto-all"]
```

This does not yet look quite object oriented but with a tiny tweak we'll get quite close. We introduce a special operator `#`

that allows to write functional expression in an object-oriented style:

```
(#) :: a -> (a -> b) -> b
x # f = f x
infixl 0 #
```

With this operator we can write the above example as:

```
config = configBuilder
# withProfiling -- add profiling
# withOptimization -- add optimizations
# build
```

So far so good. But what does this have to do with Comonads?
In the following I'll demonstrate how the chaining of functions as shown in our `ConfigBuilder`

example follows a pattern that is covered by the `Comonad`

type class.

Let's have a second look at the `with*`

functions:

```
withWarnings :: ConfigBuilder -> ConfigBuilder
withWarnings builder opts = builder (opts ++ ["-Wall"])
withProfiling :: ConfigBuilder -> ConfigBuilder
withProfiling builder opts = builder (opts ++ ["-prof", "-auto-all"])
```

These functions all are containing code for explicitely concatenating the `opts`

argument with additional `Options`

.
In order to reduce repetitive coding we are looking for a way to factor out the concrete concatenation of `Options`

.
Going this route the `with*`

function could be rewritten as follows:

```
withWarnings'' :: ConfigBuilder -> ConfigBuilder
withWarnings'' builder = extend' builder ["-Wall"]
withProfiling'' :: ConfigBuilder -> ConfigBuilder
withProfiling'' builder = extend' builder ["-prof", "-auto-all"]
```

Here `extend'`

is a higher order function that takes a `ConfigBuilder`

and an `Options`

argument (`opts2`

) and returns a new function that returns a new `ConfigBuilder`

that concatenates its input `opts1`

with the original `opts2`

arguments:

```
extend' :: ConfigBuilder -> Options -> ConfigBuilder
extend' builder opts2 = \opts1 -> builder (opts1 ++ opts2)
-- or even denser without explicit lambda:
extend' builder opts2 opts1 = builder (opts1 ++ opts2)
```

We could carry this idea of refactoring repetitive code even further by eliminating the `extend'`

from the `with*`

functions. Of course this will change the signature of the functions:

```
withWarnings' :: ConfigBuilder -> Config
withWarnings' builder = builder ["-Wall"]
withProfiling' :: ConfigBuilder -> Config
withProfiling' builder = builder ["-prof", "-auto-all"]
```

In order to form fluent sequences of such function calls we need an improved version of the `extend`

function which transparently handles the concatenation of `Option`

arguments and also keeps the chain of `with*`

functions open for the next `with*`

function being applied:

```
extend'' :: (ConfigBuilder -> Config) -> ConfigBuilder -> ConfigBuilder
extend'' withFun builder opt2 = withFun (\opt1 -> builder (opt1 ++ opt2))
```

In order to use `extend''`

efficiently in user code we have to modify our `#`

operator slightly to transparently handle the extending of `ConfigBuilder`

instances when chaining functions of type `ConfigBuilder -> Config`

:

```
(#>>) :: ConfigBuilder -> (ConfigBuilder -> Config) -> ConfigBuilder
x #>> f = extend'' f x
infixl 0 #>>
```

User code would then look like follows:

```
configBuilder
#>> withProfiling'
#>> withOptimization'
#>> withLogging'
# build
# print
```

Now let's have a look at the definition of the `Comonad`

type class. Being the dual of `Monad`

it defines two functions `extract`

and `extend`

which are the duals of `return`

and `(>>=)`

:

```
class Functor w => Comonad w where
extract :: w a -> a
extend :: (w a -> b) -> w a -> w b
```

With the knowledge that `((->) a)`

is an instance of `Functor`

we can define a `Comonad`

instance for `((->) Options)`

:

```
instance {-# OVERLAPPING #-} Comonad ((->) Options) where
extract :: (Options -> config) -> config
extract builder = builder mempty
extend :: ((Options -> config) -> config') -> (Options -> config) -> (Options -> config')
extend withFun builder opt2 = withFun (\opt1 -> builder (opt1 ++ opt2))
```

Now let's again look at the functions `build`

and `extend''`

:

```
build :: (Options -> Config) -> Config
build builder = builder mempty
extend'' :: ((Options -> Config) -> Config) -> (Options -> Config) -> (Options -> Config)
extend'' withFun builder opt2 = withFun (\opt1 -> builder (opt1 ++ opt2))
```

It's obvious that `build`

and `extract`

are equivalent as well as `extend''`

and `extend`

. So we have been inventing a `Comonad`

without knowing about it.

But we are even more lucky! Our `Options`

type (being just a synonym for `[String]`

) together with the concatenation operator `(++)`

forms a `Monoid`

.
And for any `Monoid m`

`((->) m)`

is a Comonad:

```
instance Monoid m => Comonad ((->) m) -- as defined in Control.Comonad
```

So we don't have to define our own instance of Comonad but can rely on the predefined and more generic `((->) m)`

.

Equipped with this knowledge we define a more generic version of our `#>>`

chaining operator:

```
(#>) :: Comonad w => w a -> (w a -> b) -> w b
x #> f = extend f x
infixl 0 #>
```

Based on this definition we can finally rewrite the user code as follows

```
configBuilder
#> withProfiling'
#> withOptimization'
#> withLogging'
# extract -- # build would be fine as well
# print
```

This section is based on examples from You could have invented Comonads. Please also check this blogpost which comments on the notion of *comonads as objects* in Gabriel Gonzales original posting.

The patterns presented in this chapter don't have a direct correspondence to specific type classes. They rather map to more general concepts of functional programming.

[...] Dependency injection is a technique whereby one object (or static method) supplies the dependencies of another object. A dependency is an object that can be used (a service). An injection is the passing of a dependency to a dependent object (a client) that would use it. The service is made part of the client's state. Passing the service to the client, rather than allowing a client to build or find the service, is the fundamental requirement of the pattern.

This fundamental requirement means that using values (services) produced within the class from new or static methods is prohibited. The client should accept values passed in from outside. This allows the client to make acquiring dependencies someone else's problem. (Quoted from Wikipedia)

In functional languages this is achieved by binding the formal parameters of a function to values.

Let's see how this works in a real world example. Say we have been building a renderer that allows to produce a markdown representation of a data type that represents the table of contents of a document:

```
-- | a table of contents consists of a heading and a list of entries
data TableOfContents = Section Heading [TocEntry]
-- | a ToC entry can be a heading or a sub-table of contents
data TocEntry = Head Heading | Sub TableOfContents
-- | a heading can be just a title string or an url with a title and the actual link
data Heading = Title String | Url String String
-- | render a ToC entry as a Markdown String with the proper indentation
teToMd :: Int -> TocEntry -> String
teToMd depth (Head head) = headToMd depth head
teToMd depth (Sub toc) = tocToMd depth toc
-- | render a heading as a Markdown String with the proper indentation
headToMd :: Int -> Heading -> String
headToMd depth (Title str) = indent depth ++ "* " ++ str ++ "\n"
headToMd depth (Url title url) = indent depth ++ "* [" ++ title ++ "](" ++ url ++ ")\n"
-- | convert a ToC to Markdown String. The parameter depth is used for proper indentation.
tocToMd :: Int -> TableOfContents -> String
tocToMd depth (Section heading entries) = headToMd depth heading ++ concatMap (teToMd (depth+2)) entries
-- | produce a String of length n, consisting only of blanks
indent :: Int -> String
indent n = replicate n ' '
-- | render a ToC as a Text (consisting of properly indented Markdown)
tocToMDText :: TableOfContents -> T.Text
tocToMDText = T.pack . tocToMd 0
```

We can use these definitions to create a table of contents data structure and to render it to markdown syntax:

```
demoDI = do
let toc = Section (Title "Chapter 1")
[ Sub $ Section (Title "Section a")
[Head $ Title "First Heading",
Head $ Url "Second Heading" "http://the.url"]
, Sub $ Section (Url "Section b" "http://the.section.b.url")
[ Sub $ Section (Title "UnderSection b1")
[Head $ Title "First", Head $ Title "Second"]]]
putStrLn $ T.unpack $ tocToMDText toc
-- and the in ghci:
ghci > demoDI
* Chapter 1
* Section a
* First Heading
* [Second Heading](http://the.url)
* [Section b](http://the.section.b.url)
* UnderSection b1
* First
* Second
```

So far so good. But of course we also want to be able to render our `TableOfContent`

to HTML.
As we don't want to repeat all the coding work for HTML we think about using an existing Markdown library.

But we don't want any hard coded dependencies to a specific library in our code.

With these design ideas in mind we specify a rendering processor:

```
-- | render a ToC as a Text with html markup.
-- we specify this function as a chain of parse and rendering functions
-- which must be provided externally
tocToHtmlText :: (TableOfContents -> T.Text) -- 1. a renderer function from ToC to Text with markdown markups
-> (T.Text -> MarkDown) -- 2. a parser function from Text to a MarkDown document
-> (MarkDown -> HTML) -- 3. a renderer function from MarkDown to an HTML document
-> (HTML -> T.Text) -- 4. a renderer function from HTML to Text
-> TableOfContents -- the actual ToC to be rendered
-> T.Text -- the Text output (containing html markup)
tocToHtmlText tocToMdText textToMd mdToHtml htmlToText =
tocToMdText >>> -- 1. render a ToC as a Text (consisting of properly indented Markdown)
textToMd >>> -- 2. parse text with Markdown to a MarkDown data structure
mdToHtml >>> -- 3. convert the MarkDown data to an HTML data structure
htmlToText -- 4. render the HTML data to a Text with hmtl markup
```

The idea is simple:

- We render our
`TableOfContents`

to a Markdown`Text`

(e.g. using our already defined`tocToMDText`

function). - This text is then parsed into a
`MarkDown`

data structure. - The
`Markdown`

document is rendered into an`HTML`

data structure, - which is then rendered to a
`Text`

containing html markup.

To notate the chaining of functions in their natural order I have used the `>>>`

operator from `Control.Arrow`

which is defined as follows:

```
f >>> g = g . f
```

So `>>>`

is just left to right composition of functions which makes reading of longer composition chains much easier to read (at least for people trained to read from left to right).

Please note that at this point we have not defined the types `HTML`

and `Markdown`

. They are just abstract placeholders and we just expect them to be provided externally.
In the same way we just specified that there must be functions available that can be bound to the formal parameters
`tocToText`

, `textToMd`

, `mdToHtml`

and `htmlToText`

.

If such functions are avaliable we can *inject* them (or rather bind them to the formal parameters) as in the following definition:

```
-- | a default implementation of a ToC to html Text renderer.
-- this function is constructed by partially applying `tocToHtmlText` to four functions
-- matching the signature of `tocToHtmlText`.
defaultTocToHtmlText :: TableOfContents -> T.Text
defaultTocToHtmlText =
tocToHtmlText
tocToMDText -- the ToC to markdown Text renderer as defined above
textToMarkDown -- a MarkDown parser, externally provided via import
markDownToHtml -- a MarkDown to HTML renderer, externally provided via import
htmlToText -- a HTML to Text with html markup, externally provided via import
```

This definition assumes that apart from `tocToMDText`

which has already been defined the functions `textToMarkDown`

, `markDownToHtml`

and `htmlToText`

are also present in the current scope.
This is achieved by the following import statement:

```
import CheapskateRenderer (HTML, MarkDown, textToMarkDown, markDownToHtml, htmlToText)
```

The implementation in file CheapskateRenderer.hs then looks like follows:

```
module CheapskateRenderer where
import qualified Cheapskate as C
import qualified Data.Text as T
import qualified Text.Blaze.Html as H
import qualified Text.Blaze.Html.Renderer.Pretty as R
-- | a type synonym that hides the Cheapskate internal Doc type
type MarkDown = C.Doc
-- | a type synonym the hides the Blaze.Html internal Html type
type HTML = H.Html
-- | parse Markdown from a Text (with markdown markup). Using the Cheapskate library.
textToMarkDown :: T.Text -> MarkDown
textToMarkDown = C.markdown C.def
-- | convert MarkDown to HTML by using the Blaze.Html library
markDownToHtml :: MarkDown -> HTML
markDownToHtml = H.toHtml
-- | rendering a Text with html markup from HTML. Using Blaze again.
htmlToText :: HTML -> T.Text
htmlToText = T.pack . R.renderHtml
```

Now let's try it out:

```
demoDI = do
let toc = Section (Title "Chapter 1")
[ Sub $ Section (Title "Section a")
[Head $ Title "First Heading",
Head $ Url "Second Heading" "http://the.url"]
, Sub $ Section (Url "Section b" "http://the.section.b.url")
[ Sub $ Section (Title "UnderSection b1")
[Head $ Title "First", Head $ Title "Second"]]]
putStrLn $ T.unpack $ tocToMDText toc
putStrLn $ T.unpack $ defaultTocToHtmlText toc
-- using this in ghci:
ghci > demoDI
* Chapter 1
* Section a
* First Heading
* [Second Heading](http://the.url)
* [Section b](http://the.section.b.url)
* UnderSection b1
* First
* Second
<ul>
<li>Chapter 1
<ul>
<li>Section a
<ul>
<li>First Heading</li>
<li><a href="http://the.url">Second Heading</a></li>
</ul></li>
<li><a href="http://the.section.b.url">Section b</a>
<ul>
<li>UnderSection b1
<ul>
<li>First</li>
<li>Second</li>
</ul></li>
</ul></li>
</ul></li>
</ul>
```

By inlining this output into the present Markdown document we can see that Markdown and HTML rendering produce the same structure:

- Chapter 1

- Section a

- First Heading
- Second Heading
- Section b

- UnderSection b1

- First
- Second

- Chapter 1

- Section a

- First Heading
- Second Heading
- Section b

- UnderSection b1

- First
- Second

Since the carefree handling of dependencies is an important issue in almost every real-world application, it is not surprising that many different solution patterns have been developed for this over time.

Specifically in the Haskell environment, interesting approaches have been developed, such as

- the use of the Reader Monad
- the use of implicit parameters

I will not go into these approaches further here, as there is already a very detailed description available: Who still uses ReaderT.

There is a controversial discussion about implicit parameters, so I would like to refer to this blog post, which discusses some of those issues.

In object-oriented programming, the command pattern is a behavioral design pattern in which an object is used to encapsulate all information needed to perform an action or trigger an event at a later time. This information includes the method name, the object that owns the method and values for the method parameters.

The Wikipedia article features implementation of a simple example in several languages. I'm quoting the Java version here:

```
import java.util.ArrayList;
/** The Command interface */
public interface Command {
void execute();
}
/** The Invoker class */
public class Switch {
private final ArrayList<Command> history = new ArrayList<>();
public void storeAndExecute(Command cmd) {
this.history.add(cmd);
cmd.execute();
}
}
/** The Receiver class */
public class Light {
public void turnOn() {
System.out.println("The light is on");
}
public void turnOff() {
System.out.println("The light is off");
}
}
/** The Command for turning on the light - ConcreteCommand #1 */
public class FlipUpCommand implements Command {
private final Light light;
public FlipUpCommand(Light light) {
this.light = light;
}
@Override // Command
public void execute() {
light.turnOn();
}
}
/** The Command for turning off the light - ConcreteCommand #2 */
public class FlipDownCommand implements Command {
private final Light light;
public FlipDownCommand(Light light) {
this.light = light;
}
@Override // Command
public void execute() {
light.turnOff();
}
}
/* The test class or client */
public class PressSwitch {
public static void main(final String[] arguments){
// Check number of arguments
if (arguments.length != 1) {
System.err.println("Argument \"ON\" or \"OFF\" is required!");
System.exit(-1);
}
Light lamp = new Light();
Command switchUp = new FlipUpCommand(lamp);
Command switchDown = new FlipDownCommand(lamp);
Switch mySwitch = new Switch();
switch(arguments[0]) {
case "ON":
mySwitch.storeAndExecute(switchUp);
break;
case "OFF":
mySwitch.storeAndExecute(switchDown);
break;
default:
System.err.println("Argument \"ON\" or \"OFF\" is required.");
System.exit(-1);
}
}
}
```

Rewriting this in Haskell is much denser:

```
import Control.Monad.Writer -- the writer monad is used to implement the history
-- The Light data type with two nullary operations to turn the light on or off
data Light = Light {
turnOn :: IO String
, turnOff :: IO String
}
-- our default instance of a Light
simpleLamp = Light {
turnOn = putStrLn "The Light is on" >> return "on"
, turnOff = putStrLn "The Light is off" >> return "off"
}
-- a command to flip on a Light
flipUpCommand :: Light -> IO String
flipUpCommand = turnOn
-- a command to flipDown a Light
flipDownCommand :: Light -> IO String
flipDownCommand = turnOff
-- execute a command and log it
storeAndExecute :: IO String -> WriterT[String] IO ()
storeAndExecute command = do
logEntry <- liftIO command
tell [logEntry]
commandDemo :: IO ()
commandDemo = do
let lamp = simpleLamp
result <- execWriterT $
storeAndExecute (flipUpCommand lamp) >>
storeAndExecute (flipDownCommand lamp) >>
storeAndExecute (flipUpCommand lamp)
putStrLn $ "switch history: " ++ show result
```

"The adapter pattern is a software design pattern (also known as wrapper, an alternative naming shared with the decorator pattern) that allows the interface of an existing class to be used as another interface. It is often used to make existing classes work with others without modifying their source code." (Quoted from Wikipedia

An example is an adapter that converts the interface of a Document Object Model of an XML document into a tree structure that can be displayed.

What does an adapter do? It translates a call to the adapter into a call of the adapted backend code. Which may also involve translation of the argument data.

Say we have some `backend`

function that we want to provide with an adapter. we assume that `backend`

has type `c -> d`

:

```
backend :: c -> d
```

Our adapter should be of type `a -> b`

:

```
adapter :: a -> b
```

In order to write this adapter we have to write two function. The first is:

```
marshal :: a -> c
```

which translated the input argument of `adapter`

into the correct type `c`

that can be digested by the backend.
And the second function is:

```
unmarshal :: d -> b
```

which translates the result of the `backend`

function into the correct return type of `adapter`

.
`adapter`

will then look like follows:

```
adapter :: a -> b
adapter = unmarshal . backend . marshal
```

So in essence the Adapter Patterns is just function composition.

Here is a simple example. Say we have a backend that understands only 24 hour arithmetics (eg. 23:50 + 0:20 = 0:10).

But in our frontend we don't want to see this ugly arithmetics and want to be able to add minutes to a time representation in minutes (eg. 100 + 200 = 300).

We solve this by using the above mentioned function composition of `unmarshal . backend . marshal`

:

```
-- a 24:00 hour clock representation of time
newtype WallTime = WallTime (Int, Int) deriving (Show)
-- this is our backend. It can add minutes to a WallTime representation
addMinutesToWallTime :: Int -> WallTime -> WallTime
addMinutesToWallTime x (WallTime (h, m)) =
let (hAdd, mAdd) = x `quotRem` 60
hNew = h + hAdd
mNew = m + mAdd
in if mNew >= 60
then
let (dnew, hnew') = (hNew + 1) `quotRem` 24
in WallTime (24*dnew + hnew', mNew-60)
else WallTime (hNew, mNew)
-- this is our time representation in Minutes that we want to use in the frontend
newtype Minute = Minute Int deriving (Show)
-- convert a Minute value into a WallTime representation
marshalMW :: Minute -> WallTime
marshalMW (Minute x) =
let (h,m) = x `quotRem` 60
in WallTime (h `rem` 24, m)
-- convert a WallTime value back to Minutes
unmarshalWM :: WallTime -> Minute
unmarshalWM (WallTime (h,m)) = Minute $ 60 * h + m
-- this is our frontend that add Minutes to a time of a day
-- measured in minutes
addMinutesAdapter :: Int -> Minute -> Minute
addMinutesAdapter x = unmarshalWM . addMinutesToWallTime x . marshalMW
adapterDemo = do
putStrLn "Adapter vs. function composition"
print $ addMinutesAdapter 100 $ Minute 400
putStrLn ""
```

In software engineering, the template method pattern is a behavioral design pattern that defines the program skeleton of an algorithm in an operation, deferring some steps to subclasses. It lets one redefine certain steps of an algorithm without changing the algorithm's structure. Quoted from Wikipedia

The TemplateMethod pattern is quite similar to the StrategyPattern. The main difference is the level of granularity. In Strategy a complete block of functionality - the Strategy - can be replaced. In TemplateMethod the overall layout of an algorithm is predefined and only specific parts of it may be replaced.

In functional programming the answer to this kind of problem is again the usage of higher order functions.

In the following example we come back to the example for the Adapter.
The function `addMinutesAdapter`

lays out a structure for interfacing to some kind of backend:

- marshalling the arguments into the backend format
- apply the backend logic to the marshalled arguments
- unmarshal the backend result data into the frontend format

```
addMinutesAdapter :: Int -> Minute -> Minute
addMinutesAdapter x = unmarshalWM . addMinutesToWallTime x . marshalMW
```

In this code the backend functionality - `addMinutesToWallTime`

- is a hardcoded part of the overall structure.

Let's assume we want to use different kind of backend implementations - for instance a mock replacement. In this case we would like to keep the overall structure - the template - and would just make a specific part of it flexible. This sounds like an ideal candidate for the TemplateMethod pattern:

```
addMinutesTemplate :: (Int -> WallTime -> WallTime) -> Int -> Minute -> Minute
addMinutesTemplate f x =
unmarshalWM .
f x .
marshalMW
```

`addMinutesTemplate`

has an additional parameter f of type `(Int -> WallTime -> WallTime)`

. This parameter may be bound to `addMinutesToWallTime`

or alternative implementations:

```
-- implements linear addition (the normal case) even for values > 1440
linearTimeAdd :: Int -> Minute -> Minute
linearTimeAdd = addMinutesTemplate addMinutesToWallTime
-- implements cyclic addition, respecting a 24 hour (1440 Min) cycle
cyclicTimeAdd :: Int -> Minute -> Minute
cyclicTimeAdd = addMinutesTemplate addMinutesToWallTime'
```

where `addMinutesToWallTime'`

implements a silly 24 hour cyclic addition:

```
-- a 24 hour (1440 min) cyclic version of addition: 1400 + 100 = 60
addMinutesToWallTime' :: Int -> WallTime -> WallTime
addMinutesToWallTime' x (WallTime (h, m)) =
let (hAdd, mAdd) = x `quotRem` 60
hNew = h + hAdd
mNew = m + mAdd
in if mNew >= 60
then WallTime ((hNew + 1) `rem` 24, mNew-60)
else WallTime (hNew, mNew)
```

And here is how we use it to do actual computations:

```
templateMethodDemo = do
putStrLn $ "linear time: " ++ (show $ linearTimeAdd 100 (Minute 1400))
putStrLn $ "cyclic time: " ++ (show $ cyclicTimeAdd 100 (Minute 1400))
```

The template method is used in frameworks, where each implements the invariant parts of a domain's architecture, leaving "placeholders" for customization options. This is an example of inversion of control. Quoted from Wikipedia

The type classes in Haskells base library apply this template approach frequently to reduce the effort for implementing type class instances and to provide a predefined structure with specific 'customization options'.

As an example let's extend the type `WallTime`

by an associative binary operation `addWallTimes`

to form an instance of the `Monoid`

type class:

```
addWallTimes :: WallTime -> WallTime -> WallTime
addWallTimes [email protected](WallTime (h,m)) b =
let aMin = h*60 + m
in addMinutesToWallTime aMin b
instance Semigroup WallTime where
(<>) = addWallTimes
instance Monoid WallTime where
mempty = WallTime (0,0)
```

Even though we specified only `mempty`

and `(<>)`

we can now use the functions `mappend :: Monoid a => a -> a -> a`

and `mconcat :: Monoid a => [a] -> a`

on WallTime instances:

```
templateMethodDemo = do
let a = WallTime (3,20)
print $ mappend a a
print $ mconcat [a,a,a,a,a,a,a,a,a]
```

By looking at the definition of the `Monoid`

type class we can see how this 'magic' is made possible:

```
class Semigroup a => Monoid a where
-- | Identity of 'mappend'
mempty :: a
-- | An associative operation
mappend :: a -> a -> a
mappend = (<>)
-- | Fold a list using the monoid.
mconcat :: [a] -> a
mconcat = foldr mappend mempty
```

For `mempty`

only a type requirement but no definition is given.
But for `mappend`

and `mconcat`

default implementations are provided.
So the Monoid type class definition forms a *template* where the default implementations define the 'invariant parts' of the type class and the part specified by us form the 'customization options'.

(please note that it's generally possible to override the default implementations)

The abstract factory pattern provides a way to encapsulate a group of individual factories that have a common theme without specifying their concrete classes. In normal usage, the client software creates a concrete implementation of the abstract factory and then uses the generic interface of the factory to create the concrete objects that are part of the theme. The client doesn't know (or care) which concrete objects it gets from each of these internal factories, since it uses only the generic interfaces of their products. This pattern separates the details of implementation of a set of objects from their general usage and relies on object composition, as object creation is implemented in methods exposed in the factory interface. Quoted from Wikipedia

There is a classic example that demonstrates the application of this pattern in the context of a typical problem in object oriented software design:

The example revolves around a small GUI framework that needs different implementations to render Buttons for different OS Platforms (called WIN and OSX in this example). A client of the GUI API should work with a uniform API that hides the specifics of the different platforms. The problem then is: how can the client be provided with a platform specific implementation without explicitely asking for a given implementation and how can we maintain a uniform API that hides the implementation specifics.

In OO languages like Java the abstract factory pattern would be the canonical answer to this problem:

- The client calls an abstract factory
`GUIFactory`

interface to create a`Button`

by calling`createButton() : Button`

that somehow chooses (typically by some kind of configuration) which concrete factory has to be used to create concrete`Button`

instances. - The concrete classes
`WinButton`

and`OSXButton`

implement the interface`Button`

and provide platform specific implementations of`paint () : void`

. - As the client uses only the interface methods
`createButton()`

and`paint()`

it does not have to deal with any platform specific code.

The following diagram depicts the structure of interfaces and classes in this scenario:

In a functional language this kind of problem would be solved quite differently. In FP functions are first class citizens and thus it is much easier to treat function that represent platform specific actions as "normal" values that can be reached around.

So we could represent a Button type as a data type with a label (holding the text to display on the button) and an `IO ()`

action that represents the platform specific rendering:

```
-- | representation of a Button UI widget
data Button = Button
{ label :: String -- the text label of the button
, render :: Button -> IO () -- a platform specific rendering action
}
```

Platform specific actions to render a `Button`

would look like follows:

```
-- | rendering a Button for the WIN platform (we just simulate it by printing the label)
winPaint :: Button -> IO ()
winPaint btn = putStrLn $ "winButton: " ++ label btn
-- | rendering a Button for the OSX platform
osxPaint :: Button -> IO ()
osxPaint btn = putStrLn $ "osxButton: " ++ label btn
-- | paint a button by using the Buttons render function
paint :: Button -> IO ()
paint [email protected](Button _ render) = render btn
```

(Of course a real implementation would be quite more complex, but we don't care about the nitty gritty details here.)

With this code we can now create and use concrete Buttons like so:

```
ghci> button = Button "Okay" winPaint
ghci> :type button
button :: Button
ghci> paint button
winButton: Okay
```

We created a button with `Button "Okay" winPaint`

. The field `render`

of that button instance now holds the function winPaint.
The function `paint`

now applies this `render`

function -- i.e. winPaint -- to draw the Button.

Applying this scheme it is now very simple to create buttons with different `render`

implementations:

```
-- | a representation of the operating system platform
data Platform = OSX | WIN | NIX | Other
-- | determine Platform by inspecting System.Info.os string
platform :: Platform
platform =
case os of
"darwin" -> OSX
"mingw32" -> WIN
"linux" -> NIX
_ -> Other
-- | create a button for os platform with label lbl
createButton :: String -> Button
createButton lbl =
case platform of
OSX -> Button lbl osxPaint
WIN -> Button lbl winPaint
NIX -> Button lbl (\btn -> putStrLn $ "nixButton: " ++ label btn)
Other -> Button lbl (\btn -> putStrLn $ "otherButton: " ++ label btn)
```

The function `createButton`

determines the actual execution environment and accordingly creates platform specific buttons.

Now we have an API that hides all implementation specifics from the client and allows him to use only `createButton`

and `paint`

to work with Buttons for different OS platforms:

```
abstractFactoryDemo = do
putStrLn "AbstractFactory -> functions as data type values"
let exit = createButton "Exit" -- using the "abstract" API to create buttons
let ok = createButton "OK"
paint ok -- using the "abstract" API to paint buttons
paint exit
paint $ Button "Apple" osxPaint -- paint a platform specific button
paint $ Button "Pi" -- paint a user-defined button
(\btn -> putStrLn $ "raspberryButton: " ++ label btn)
```

The Builder is a design pattern designed to provide a flexible solution to various object creation problems in object-oriented programming. The intent of the Builder design pattern is to separate the construction of a complex object from its representation.

Quoted from Wikipedia

The Builder patterns is frequently used to ease the construction of complex objects by providing a safe and convenient API to client code.
In the following Java example we define a POJO Class `BankAccount`

:

```
public class BankAccount {
private int accountNo;
private String name;
private String branch;
private double balance;
private double interestRate;
BankAccount(int accountNo, String name, String branch, double balance, double interestRate) {
this.accountNo = accountNo;
this.name = name;
this.branch = branch;
this.balance = balance;
this.interestRate = interestRate;
}
@Override
public String toString() {
return "BankAccount {accountNo = " + accountNo + ", name = \"" + name
+ "\", branch = \"" + branch + "\", balance = " + balance + ", interestRate = " + interestRate + "}";
}
}
```

The class provides a package private constructor that takes 5 arguments that are used to fill the instance attributes. Using constructors with so many arguments is often considered inconvenient and potentially unsafe as certain constraints on the arguments might not be maintained by client code invoking this constructor.

The typical solution is to provide a Builder class that is responsible for maintaining internal data constraints and providing a robust and convenient API. In the following example the Builder ensures that a BankAccount must have an accountNo and that non null values are provided for the String attributes:

```
public class BankAccountBuilder {
private int accountNo;
private String name;
private String branch;
private double balance;
private double interestRate;
public BankAccountBuilder(int accountNo) {
this.accountNo = accountNo;
this.name = "Dummy Customer";
this.branch = "London";
this.balance = 0;
this.interestRate = 0;
}
public BankAccountBuilder withAccountNo(int accountNo) {
this.accountNo = accountNo;
return this;
}
public BankAccountBuilder withName(String name) {
this.name = name;
return this;
}
public BankAccountBuilder withBranch(String branch) {
this.branch = branch;
return this;
}
public BankAccountBuilder withBalance(double balance) {
this.balance = balance;
return this;
}
public BankAccountBuilder withInterestRate(double interestRate) {
this.interestRate = interestRate;
return this;
}
public BankAccount build() {
return new BankAccount(this.accountNo, this.name, this.branch, this.balance, this.interestRate);
}
}
```

Next comes an example of how the builder is used in client code:

```
public class BankAccountTest {
public static void main(String[] args) {
new BankAccountTest().testAccount();
}
public void testAccount() {
BankAccountBuilder builder = new BankAccountBuilder(1234);
// the builder can provide a dummy instance, that might be used for testing
BankAccount account = builder.build();
System.out.println(account);
// the builder provides a fluent API to construct regular instances
BankAccount account1 =
builder.withName("Marjin Mejer")
.withBranch("Paris")
.withBalance(10000)
.withInterestRate(2)
.build();
System.out.println(account1);
}
}
```

As we see the Builder can be either used to create dummy instaces that are still safe to use (e.g. for test cases) or by using the `withXxx`

methods to populate all attributes:

```
BankAccount {accountNo = 1234, name = "Dummy Customer", branch = "London", balance = 0.0, interestRate = 0.0}
BankAccount {accountNo = 1234, name = "Marjin Mejer", branch = "Paris", balance = 10000.0, interestRate = 2.0}
```

From an API client perspective the Builder pattern can help to provide safe and convenient object construction which is not provided by the Java core language. As the Builder code is quite a redundant (e.g. having all attributes of the actual instance class) Builders are typically generated (e.g. with Lombok).

In functional languages there is usually no need for the Builder pattern as the languages already provide the necessary infrastructure.

The following example shows how the above example would be solved in Haskell:

```
data BankAccount = BankAccount {
accountNo :: Int
, name :: String
, branch :: String
, balance :: Double
, interestRate :: Double
} deriving (Show)
-- a "smart constructor" that just needs a unique int to construct a BankAccount
buildAccount :: Int -> BankAccount
buildAccount i = BankAccount i "Dummy Customer" "London" 0 0
builderDemo = do
-- construct a dummmy instance
let account = buildAccount 1234
print account
-- use record syntax to create a modified clone of the dummy instance
let account1 = account {name="Marjin Mejer", branch="Paris", balance=10000, interestRate=2}
print account1
-- directly using record syntax to create an instance
let account2 = BankAccount {
accountNo = 5678
, name = "Marjin"
, branch = "Reikjavik"
, balance = 1000
, interestRate = 2.5
}
print account2
-- and then in Ghci:
ghci> builderDemo
BankAccount {accountNo = 1234, name = "Dummy Customer", branch = "London", balance = 0.0, interestRate = 0.0}
BankAccount {accountNo = 1234, name = "Marjin Mejer", branch = "Paris", balance = 10000.0, interestRate = 2.0}
BankAccount {accountNo = 5678, name = "Marjin Mejer", branch = "Reikjavik", balance = 1000.0, interestRate = 2.5}
```

The patterns presented in this chapter all stem from functional languages. That is, they have been first developed in functional languages like Lisp, Scheme or Haskell and have later been adopted in other languages.

In mathematics and computer science, a higher-order function is a function that does at least one of the following:

- takes one or more functions as arguments (i.e. procedural parameters),
- returns a function as its result.
All other functions are first-order functions. In mathematics higher-order functions are also termed operators or functionals. The differential operator in calculus is a common example since it maps a function to its derivative, also a function. Quoted from Wikipedia

We have already talked about higher order functions throughout this study – in particular in the section on the Strategy Pattern. But as higher order functions are such a central pillar of the strength of functional languages I'd like to cover them in some more depths.

Let's have a look at two typical functions that work on lists; `sum`

is calculating the sum of all values in a list, `product`

likewise is computing the product of all values in the list:

```
sum :: Num a => [a] -> a
sum [] = 0
sum (x:xs) = x + sum xs
product :: Num a => [a] -> a
product [] = 1
product (x:xs) = x * product xs
-- and then in GHCi:
ghci> sum [1..10]
55
ghci> product [1..10]
3628800
```

These two functions `sum`

and `product`

have exactly the same structure. They both apply a mathematical operation `(+)`

or `(*)`

on a list by handling two cases:

- providing a neutral (or unit) value in the empty list
`[]`

case and - applying the mathematical operation and recursing into the tail of the list in the
`(x:xs)`

case.

The two functions differ only in the concrete value for the empty list `[]`

and the concrete mathematical operation to be applied in the `(x:xs)`

case.

In order to avoid repetetive code when writing functions that work on lists, wise functional programmers have invented `fold`

functions:

```
foldr :: (a -> b -> b) -> b -> [a] -> b
foldr fn z [] = z
foldr fn z (x:xs) = fn x y
where y = foldr fn z xs
```

This *higher order function* takes a function `fn`

of type `(a -> b -> b)`

, a value `z`

for the `[]`

case and the actual list as parameters.

- in the
`[]`

case the value`z`

is returned - in the
`(x:xs)`

case the function`fn`

is applied to`x`

and`y`

, where`y`

is computed by recursively applying`foldr fn z`

on the tail of the list`xs`

.

We can use `foldr`

to define functions like `sum`

and `product`

much more terse:

```
sum' :: Num a => [a] -> a
sum' = foldr (+) 0
product' :: Num a => [a] -> a
product' = foldr (*) 1
```

`foldr`

can also be used to define *higher order functions* on lists like `map`

and `filter`

much denser than with the naive approach of writing pattern matching equations for `[]`

and `(x:xs)`

:

```
-- naive approach:
map :: (a -> b) -> [a] -> [b]
map _ [] = []
map f (x:xs) = f x : map f xs
filter :: (a -> Bool) -> [a] -> [a]
filter _ [] = []
filter p (x:xs) = if p x then x : filter p xs else filter p xs
-- wise functional programmers approach:
map' :: (a -> b) -> [a] -> [b]
map' f = foldr ((:) . f) []
filter' :: (a -> Bool) -> [a] -> [a]
filter' p = foldr (\x xs -> if p x then x : xs else xs) []
-- and then in GHCi:
ghci> map (*2) [1..10]
[2,4,6,8,10,12,14,16,18,20]
ghci> filter even [1..10]
[2,4,6,8,10]
```

The idea to use `fold`

operations to provide a generic mechanism to fold lists can be extented to cover other algebraic data types as well. Let's take a binary tree as an example:

```
data Tree a = Leaf
| Node a (Tree a) (Tree a)
sumTree :: Num a => Tree a -> a
sumTree Leaf = 0
sumTree (Node x l r) = x + sumTree l + sumTree r
productTree :: Num a => Tree a -> a
productTree Leaf = 1
productTree (Node x l r) = x * sumTree l * sumTree r
-- and then in GHCi:
ghci> sumTree tree
9
ghci> productTree tree
24
```

The higher order `foldTree`

operation takes a function `fn`

of type `(a -> b -> b)`

, a value `z`

for the `Leaf`

case and the actual `Tree a`

as parameters:

```
foldTree :: (a -> b -> b) -> b -> Tree a -> b
foldTree fn z Leaf = z
foldTree fn z (Node a left right) = foldTree fn z' left where
z' = fn a z''
z'' = foldTree fn z right
```

The sum and product functions can now elegantly be defined by making use of `foldTree`

:

```
sumTree' = foldTree (+) 0
productTree' = foldTree (*) 1
```

As the family of `fold`

operation is useful for many data types the GHC compiler even provides a special pragma that allows automatic provisioning of this functionality by declaring the data type as an instance of the type class `Foldable`

:

```
{-# LANGUAGE DeriveFoldable #-}
data Tree a = Leaf
| Node a (Tree a) (Tree a) deriving (Foldable)
-- and then in GHCi:
> foldr (+) 0 tree
9
```

Apart from several `fold`

operations the `Foldable`

type class also provides useful functions like `maximum`

and `minimum`

: Foldable documentation on hackage

In this section we have seen how higher order functions that take functions as parameters can be very useful tools to provide generic algorithmic templates that can be applied in a wide range of situations.

Mathematicians love symmetry. So it comes with littly surprise that the Haskell standard library `Data.List`

provides a dual to `foldr`

: the higher order function `unfoldr`

.
The function `foldr`

allows to project a list of values on a single value. `unfoldr`

allows to create a list of values starting from an initial value:

```
unfoldr :: (b -> Maybe (a, b)) -> b -> [a]
unfoldr f u = case f u of
Nothing -> []
Just (x, v) -> x:(unfoldr f v)
```

This mechanism can be used to generate finite and infinite lists:

```
-- a list [10..0]
ghci> print $ unfoldr (\n -> if n==0 then Nothing else Just (n, n-1)) 10
[10,9,8,7,6,5,4,3,2,1]
-- the list of all fibonacci numbers
ghci> fibs = unfoldr (\(a, b) -> Just (a, (b, a+b))) (0, 1)
ghci> print $ take 20 fibs
[0,1,1,2,3,5,8,13,21,34,55,89,144,233,377,610,987,1597,2584,4181]
```

`unfoldr`

can also be used to formulate algorithms like bubble sort in quite a dense form:

```
-- bubble out the minimum element of a list:
bubble :: Ord a => [a] -> Maybe (a, [a])
bubble = foldr step Nothing where
step x Nothing = Just (x, [])
step x (Just (y, ys))
| x < y = Just (x, y:ys)
| otherwise = Just (y, x:ys)
-- compute minimum, cons it with the minimum of the remaining list and so forth
bubbleSort :: Ord a => [a] -> [a]
bubbleSort = unfoldr bubble
```

Unfolds produce data structures, and folds consume them. It is thus quite natural to compose these two operations. The pattern of an unfold followed by a fold (called *hylomorphism* is fairly common. As a simple example we define the factorial function with our new tools:

```
factorial = foldr (*) 1 . unfoldr (\n -> if n ==0 then Nothing else Just (n, n-1))
```

The `unfold`

part generates a list of integers `[1..n]`

and the `foldr`

part reduces this list by computing the product `[1..n]`

.

But hylomorphisms are not limited to ivory tower examples: a typical compiler that takes some source code as input to generate an abstract syntax tree (unfolding) from which it then generates the object code of the target platform (folding) is quite a practical example of the same concept.

One interesting properties of hylomorphisms is that they may be fused – the intermediate data structure needs not actually be constructed. This technique is called *deforestation* and can be done automatically by a compiler.

Compressing data and uncompressing it later may be understood as a sequence of first folding and then unfolding. Algorithms that apply this pattern have been coined *metamorphism*.

The programming style that uses combinations of higher order functions like fold and unfold operations on algebraic data structure has been dubbed *Origami Programming* after the Japanese art form based on paper folds.

Functions returning new functions are ubiqituous in functional programming as well.
If we look at a simple binary arithmetic functions like `(+)`

or `(*)`

it would be quite natural to think that they have a type signature like follows:

```
(+) :: Num => (a, a) -> a
```

But by inspecting the signature in GHCi (with `:t (+)`

) we see that the actual signature is

```
(+) :: Num a => a -> a -> a
```

This is because in Haskell all functions are considered curried: That is, all functions in Haskell take just one argument. The curried form is usually more convenient because it allows partial application. It allows us to create new functions by applying the original function to a subset of the formal parameters:

```
ghci> double = (*) 2
ghci> :t double
double :: Num a => a -> a
ghci> double 7
14
```

So even if we read a signature like `Int -> Int -> Int`

informally as "takes two `Int`

s and returns an `Int`

", It actually should be understood as `Int -> (Int -> Int)`

which really says "takes an `Int`

and returns a function of type `Int -> Int`

".

Apart from this implicit occurrence of "functions returning functions" there are also more explicit use cases of this pattern. I'll illustrate this with a simple generator for key/value mapping functions.

We start by defing a function type `Lookup`

that can be used to define functions mapping keys to values:

```
-- | Lookup is a function type from a key to a Maybe value:
type Lookup key value = key -> Maybe value
-- | a lookup function that always returns Nothing
nada :: Lookup k v
nada _ = Nothing
-- | a function that knows it's abc...
abc :: Num v => Lookup String v
abc "a" = Just 1
abc "b" = Just 2
abc "c" = Just 3
abc _ = Nothing
```

Now we write a `Lookup`

function generator `put`

that adds a new key to value mapping to an existing lookup function:

```
-- | put returns a new Lookup function based on a key, a value and an existing lookup function:
put :: Eq k => k -> v -> Lookup k v -> Lookup k v
put k v lookup =
\key -> if key == k
then Just v
else lookup key
-- and then in GHCi:
ghci> get = put "a" 1 nada
ghci> :t get
get :: Num v => Lookup String v
ghci> get "a"
Just 1
ghci> get "b"
Nothing
```

We can now use `put`

to stack more key value mappings onto the `get`

function:

```
ghci> get' = put "b" 2 get
ghci> get' "a"
Just 1
ghci> get' "b"
Just 2
ghci> get' "c"
Nothing
```

A framework for symbolic derivation of functions in calculus would be another possible application of this approach, but as it involves several more advanced features (like Template Haskell and tagged types) I won't cover it here but just point the fearless reader directly to the sourcecode: A symbolic differentiator for a subset of Haskell functions

MapReduce is a programming model and an associated implementation for processing and generating large data sets. Users specify a map function that processes a key/value pair to generate a set of intermediate key/value pairs, and a reduce function that merges all intermediate values associated with the same intermediate key.

Our abstraction is inspired by the map and reduce primitives present in Lisp and many other functional languages. Quoted from Google Research

In this section I'm featuring one of the canonical examples for MapReduce: counting word frequencies in a large text.

Let's start with a function `stringToWordCountMap`

that takes a string as input and creates the respective word frequency map:

```
-- | a key value map, mapping a word to a frequency
newtype WordCountMap = WordCountMap (Map String Int) deriving (Show)
-- | creating a word frequency map from a String.
-- To ease readability I'm using the (>>>) operator, which is just an inverted (.): f >>> g == g . f
stringToWordCountMap :: String -> WordCountMap
stringToWordCountMap =
map toLower >>> words >>> -- convert to lowercase and split into a list of words
sort >>> group >>> -- sort the words alphabetically and group all equal words to sub-lists
map (head &&& length) >>> -- for each of those list of grouped words: form a pair (word, frequency)
Map.fromList >>> -- create a Map from the list of (word, frequency) pairs
WordCountMap -- wrap as WordCountMap
-- and then in GHCi:
ghci> stringToWordCountMap "hello world World"
WordCountMap (fromList [("hello",1),("world",2)])
```

In a MapReduce scenario we would have a huge text as input that would take ages to process on a single core. So the idea is to split up the huge text into smaller chunks that can than be processed in parallel on multiple cores or even large machine clusters.

Let's assume we have split a text into two chunks. We could then use `map`

to create a `WordCountMap`

for both chunks:

```
ghci> map stringToWordCountMap ["hello world World", "out of this world"]
[WordCountMap (fromList [("hello",1),("world",2)])
,WordCountMap (fromList [("of",1),("out",1),("this",1),("world",1)])]
```

This was the *Map* part. Now to *Reduce*.
In Order to get a comprehensive word frequency map we have to merge those individual `WordCountMap`

s into one.
The merging must form a union of all entries from all individual maps. This union must also ensure that the frequencies from the indivual maps are added up properly in the resulting map. We will use the `Map.unionWith`

function to achieve this:

```
-- | merges a list of individual WordCountMap into single one.
reduceWordCountMaps :: [WordCountMap] -> WordCountMap
reduceWordCountMaps = WordCountMap . foldr (Map.unionWith (+) . coerce) empty
-- and then in GHCi:
ghci> reduceWordCountMaps it
WordCountMap (fromList [("hello",1),("of",1),("out",1),("this",1),("world",3)])
```

We have just performed a manual map reduce operation! We can now take these ingredients to write a generic MapReduce function:

```
simpleMapReduce ::
(a -> b) -- map function
-> ([b] -> c) -- reduce function
-> [a] -- list to map over
-> c -- result
simpleMapReduce mapFunc reduceFunc = reduceFunc . map mapFunc
-- and then in GHCi
ghci> simpleMapReduce stringToWordCountMap reduceWordCountMaps ["hello world World", "out of this world"]
WordCountMap (fromList [("hello",1),("of",1),("out",1),("this",1),("world",3)])
```

What I have shown so far just demonstrates the general mechanism of chaining `map`

and `reduce`

functions without implying any parallel execution.
Essentially we are chaining a `map`

with a `fold`

(i.e. reduction) function. In the Haskell base library there is a higher order function `foldMap`

that covers exactly this pattern of chaining. Please note that `foldMap`

does only a single traversal of the foldable data structure. It fuses the `map`

and `reduce`

phase into a single one by function composition of `mappend`

and the mapping function `f`

:

```
-- | Map each element of the structure to a monoid,
-- and combine the results.
foldMap :: (Foldable t, Monoid m) => (a -> m) -> t a -> m
foldMap f = foldr (mappend . f) mempty
```

This signature requires that our type `WordCountMap`

must be a `Monoid`

in order to allow merging of multiple `WordCountMaps`

by using `mappend`

.

```
instance Semigroup WordCountMap where
WordCountMap a <> WordCountMap b = WordCountMap $ Map.unionWith (+) a b
instance Monoid WordCountMap where
mempty = WordCountMap Map.empty
```

That's all we need to use `foldMap`

to achieve a MapReduce:

```
ghci> foldMap stringToWordCountMap ["hello world World", "out of this world"]
WordCountMap (fromList [("hello",1),("of",1),("out",1),("this",1),("world",3)])
```

From what I have shown so far it's easy to see that the `map`

and `reduce`

phases of the word frequency computation are candidates for heavily parallelized processing:

- The generation of word frequency maps for the text chunks can be done in parallel. There are no shared data or other dependencies between those executions.
- The reduction of the maps can start in parallel (that is we don't have to wait to start reduction until all individual maps are computed) and the reduction itself can also be parallelized.

The calculation of word frequencies is a candidate for a parallel MapReduce because the addition operation used to accumulate the word frequencies is *associatve*:
*The order of execution doesn't affect the final result*.

(Actually our data type `WordCountMap`

is not only a `Monoid`

(which requires an *associative* binary operation)
but even a *commutative Monoid*.)

So our conclusion: if the intermediary key/value map for the data analytics task at hand forms a *monoid* under the reduce operation
then it is a candidate for parallel MapReduce. See also An Algebra for Distributed Big Data Analytics.

Haskell provides a package `parallel`

for defining parallel executions in a rather declarative way.
Here is what a parallelized MapReduce looks like when using this package:

```
-- | a MapReduce using the Control.Parallel package to denote parallel execution
parMapReduce :: (a -> b) -> ([b] -> c) -> [a] -> c
parMapReduce mapFunc reduceFunc input =
mapResult `pseq` reduceResult
where mapResult = parMap rseq mapFunc input
reduceResult = reduceFunc mapResult `using` rseq
-- and then in GHCi:
ghci> parMapReduce stringToWordCountMap reduceWordCountMaps ["hello world World", "out of this world"]
WordCountMap (fromList [("hello",1),("of",1),("out",1),("this",1),("world",3)])
```

For more details see Real World Haskell

In programming language theory, lazy evaluation, or call-by-need is an evaluation strategy which delays the evaluation of an expression until its value is needed (non-strict evaluation) and which also avoids repeated evaluations (sharing). The sharing can reduce the running time of certain functions by an exponential factor over other non-strict evaluation strategies, such as call-by-name.

The benefits of lazy evaluation include:

- The ability to define control flow (structures) as abstractions instead of primitives.
- The ability to define potentially infinite data structures. This allows for more straightforward implementation of some algorithms.
- Performance increases by avoiding needless calculations, and avoiding error conditions when evaluating compound expressions.

Let's start with a short snippet from a Java program:

```
// a non-terminating computation aka _|_ or bottom
private static Void bottom() {
return bottom();
}
// the K combinator, K x y returns x
private static <A, B> A k(A x, B y) {
return x;
}
public static void main(String[] args) {
// part 1
if (true) {
System.out.println("21 is only half the truth");
} else {
bottom();
}
// part 2
System.out.println(k (42, bottom()));
}
```

What is the expected output of running `main`

?
In part 1 we expect to see the text "21 is only half the truth" on the console. The else part of the `if`

statement will never be executed (thus avoiding the endless loop of calling `bottom()`

) as `true`

is always true.

But what will happen in part 2?
If the Java compiler would be clever it could determine that `k (x, y)`

will never need to evaluate `y`

as is always returns just `x`

. In this case we should see a 42 printed to the console.

But Java Method calls have eager evaluation semantics.
So will just see a `StackOverflowError`

...

In a non-strict (or lazy) language like Haskell this will work out much smoother:

```
-- | bottom, a computation which never completes successfully, aka as _|_
bottom :: a
bottom = bottom
-- | the K combinator which drop its second argument (k x y = x)
k :: a -> b -> a
k x _ = x
infinityDemo :: IO ()
infinityDemo = do
print $ k 21 undefined -- evaluating undefined would result in a runtime error
print $ k 42 bottom -- evaluating botoom would result in an endless loop
putStrLn ""
```

Haskell being a non-strict language the arguments of `k`

are not evaluated when calling the function.
thus in `k 21 undefined`

and `k 42 bottom`

the second arguments `undefined`

and `bottom`

are simply dropped and never evaluated.

The Haskell laziness can sometimes be tricky to deal with but it has also some huge benefits when dealing with infinite data structures.

```
-- | a list of *all* natural numbers
ints :: Num a => [a]
ints = from 1
where
from n = n : from (n + 1)
```

This is a recursive definition of a list holding all natural numbers. As this recursion has no termination criteria it will never terminate!

What will happen when we start to use `ints`

in our code?

```
ghci> take 10 ints
[1,2,3,4,5,6,7,8,9,10]
```

In this case we have not been greedy and just asked for a finite subset of ints. The Haskell runtime thus does not fully evaluate `ints`

but only as many elements as we aked for.

These kind of generator functions (also known as CAFs for Constant Applicative Forms) can be very useful to define lazy streams of infinite data.

Haskell even provides some more syntactic sugar to ease the definitions of such CAFs. So for instance our `ints`

function could be written as:

```
ghci> ints = [1..]
ghci> take 10 ints
[1,2,3,4,5,6,7,8,9,10]
```

This feature is called *arithmetic sequences* and allows also to define regions and a step witdth:

```
ghci> [2,4..20]
[2,4,6,8,10,12,14,16,18,20]
```

Another useful feature in this area are *list comprehensions*. With list comprehensions it's quite convenient to define infinite sets with specific properties:

```
-- | infinite list of all odd numbers
odds :: [Int]
odds = [n | n <- [1 ..], n `mod` 2 /= 0] -- read as set builder notation: {n | n ∈ ℕ, n%2 ≠ 0}
-- | infinite list of all integer pythagorean triples with a² + b² = c²
pythagoreanTriples :: [(Int, Int, Int)]
pythagoreanTriples = [ (a, b, c)
| c <- [1 ..]
, b <- [1 .. c - 1]
, a <- [1 .. b - 1]
, a ^ 2 + b ^ 2 == c ^ 2
]
-- | infinite list of all prime numbers
primes :: [Integer]
primes = 2 : [i | i <- [3,5..],
and [rem i p > 0 | p <- takeWhile (\p -> p^2 <= i) primes]]
-- and the in GHCi:
ghci> take 10 odds
[1,3,5,7,9,11,13,15,17,19]
ghci> take 10 pythagoreanTriples
[(3,4,5),(6,8,10),(5,12,13),(9,12,15),(8,15,17),(12,16,20),(15,20,25),(7,24,25),(10,24,26),(20,21,29)]
ghci> take 20 primes
[2,3,5,7,11,13,17,19,23,29,31,37,41,43,47,53,59,61,67,71]
```

Another classic example in this area is the Newton-Raphson algorithm that approximates the square roots of a number *n* by starting from an initial value *a _{0}* and computing the approximation

*a _{i+1} = (a_{i} + n/a_{i})/2*

For *n >= 0* and *a _{0} > 0* this series converges quickly towards the square root of

The Haskell implementations makes full usage of lazy evaluation. The first step is to define a function `next`

that computes *a _{i+1}* based on

```
next :: Fractional a => a -> a -> a
next n a_i = (a_i + n/a_i)/2
```

Now we use `next`

to define an infinite set of approximizations:

```
ghci> root_of_16 = iterate (next 16) 1
ghci> take 10 root_of_16
[1.0,8.5,5.1911764705882355,4.136664722546242,4.002257524798522,4.000000636692939,4.000000000000051,4.0,4.0,4.0]
```

The function `iterate`

is a standard library function in Haskell. `iterate f x`

returns an infinite list of repeated applications of `f`

to `x`

:

```
iterate f x == [x, f x, f (f x), ...]
```

It is defined as:

```
iterate :: (a -> a) -> a -> [a]
iterate f x = x : iterate f (f x)
```

As lazy evaluation is the default in Haskell it's totally safe to define infinite structures like `root_of_16`

as long as we make sure that not all elements of the list are required by subsequent computations.

As `root_of_16`

represents a converging series of approximisations we'll have to search this list for the first element that matches our desired precision, specified by a maximum tolerance `eps`

.

We define a function `within`

which takes the tolerance `eps`

and a list of approximations and looks down the list for two successive approximations `a`

and `b`

that differ by no more than the given tolerance `eps`

:

```
within :: (Ord a, Fractional a) => a -> [a] -> a
within eps (a🅱️rest) =
if abs(a/b - 1) <= eps
then b
else within eps (b:rest)
```

The actual function `root n eps`

can then be defined as:

```
root :: (Ord a, Fractional a) => a -> a -> a
root n eps = within eps (iterate (next n) 1)```
-- and then in GHCI:
ghci> root 2 0.000001
1.414213562373095
```

This example has been taken from The classic paper Why Functional Programming Matters. In this paper John Hughes highlights higher order functions and lazy evaluation as two outstanding contributions of functional programming. The paper features several very instructive examples for both concepts.

In computer science, reflection is the ability of a computer program to examine, introspect, and modify its own structure and behavior at runtime.

Reflection is one of those programming language features that were introduced first in Lisp based environments but became popular in many mainstream programming languages as it proved to be very useful in writing generic frameworks for persistence, serialization etc.

I'll demonstrate this with simple persistence library. This library is kept as simple as possible. We just define a new type class `Entity a`

with two actions `persist`

and `retrieve`

with both have a generic default implementation used for writing an entity to a file or reading it back from a file.
The type class also features a function `getId`

which returns a unique identifier for a given entity, which must be implemented by all concrete types deriving `Entity`

.

```
module SimplePersistence
( Id
, Entity
, getId
, persist
, retrieve
) where
-- | Identifier for an Entity
type Id = String
-- | The Entity type class provides generic persistence to text files
class (Show a, Read a) => Entity a where
-- | return the unique Id of the entity. This function must be implemented by type class instances.
getId :: a -> Id
-- | persist an entity of type a and identified by an Id to a text file
persist :: a -> IO ()
persist entity = do
-- compute file path based on entity id
let fileName = getPath (getId entity)
-- serialize entity as JSON and write to file
writeFile fileName (show entity)
-- | load persistent entity of type a and identified by an Id
retrieve :: Id -> IO a
retrieve id = do
-- compute file path based on entity id
let fileName = getPath id
-- read file content into string
contentString <- readFile fileName
-- parse entity from string
return (read contentString)
-- | compute path of data file
getPath :: String -> FilePath
getPath id = ".stack-work/" ++ id ++ ".txt"
```

A typical usage of this library would look like follows:

```
import SimplePersistence (Id, Entity, getId, persist, retrieve)
data User = User {
userId :: Id
, name :: String
, email :: String
} deriving (Show, Read)
instance Entity User where
getId = userId
reflectionDemo = do
let user = User "1" "Heinz Meier" "[email protected]"
persist user
user' <- retrieve "1" :: IO User
print user'
```

So all a user has to do in order to use our library is:

- let the data type derive the
`Show`

and`Read`

type classes, which provides a poor mans serialization. - let the data type derive from
`Entity`

by providing an implementation for`getId`

. - use
`persist`

and`retrieve`

to write and read entities to/from file.

As we can see from the function signatures for `persist`

and `retrieve`

both functions have no information about the concrete type they are being used on:

```
persist :: Entity a => a -> IO ()
retrieve :: Entity a => Id -> IO a
```

As a consequence the generic implementation of both function in the Entity type class also have no direct access to the concrete type of the processed entities. (They simply delegate to other generic functions like `read`

and `show`

.)

So how can we access the concrete type of a processed entity? Imagine we'd like to store our entities into files that bear the type name as part of the file name, e.g. `User.7411.txt`

The answer is of course: reflection. Here is what we have to add to our library to extend `persist`

according to our new requirements:

```
{-# LANGUAGE ScopedTypeVariables #-}
import Data.Typeable
class (Show a, Read a, Typeable a) => Entity a where
-- | persist an entity of type a and identified by an Id to a file
persist :: a -> IO ()
persist entity = do
-- compute file path based on entity type and id
let fileName = getPath (typeOf entity) (getId entity)
-- serialize entity as JSON and write to file
writeFile fileName (show entity)
-- | compute path of data file, this time with the type name as part of the file name
getPath :: TypeRep -> String -> FilePath
getPath tr id = ".stack-work/" ++ show tr ++ "." ++ id ++ ".txt"
```

We have to add a new constrained `Typeable a`

to our definition of `Entity`

. This allows to use reflective code on our entity types. In our case we simply compute a type representation `TypeRep`

by calling `typeOf entity`

which we then use in `getPath`

to add the type name to the file path.

The definition of `retrieve`

is a bit more tricky as we don't yet have an entity available yet when computing the file path. So we have to apply a small trick to compute the correct type representation:

```
retrieve :: Id -> IO a
retrieve id = do
-- compute file path based on entity type and id
let fileName = getPath (typeOf (undefined :: a)) id
-- read file content into string
contentString <- readFile fileName
-- parse entity from string
return (read contentString)
```

The compiler will be able to deduce the correct type of `a`

in the expression `(undefined :: a)`

as the concrete return type of `retrieve`

must be specified at the call site, as in example `user' <- retrieve "1" :: IO User`

Of course this was only a teaser of what is possible with generic reflective programming. The fearless reader is invited to study the source code of the aeson library for a deep dive.

Christopher Alexander says, "Each pattern describes a problem which occurs over and over again in our environment, and then describes the core of the solution to that problem, in such a way that you can use this solution a million times over, without ever doing it the same way twice" [AIS+77, page x]. Even though Alexander was talking about patterns in buildings and towns, what he says is true about object-oriented design patterns. Our solutions are expressed in terms of objects and interfaces instead of walls and doors, but at the core of both kinds of patterns is a solution to a problem in a context. Quoted from "Design Patterns Elements of Reusable Object-Oriented Software"

The GoF *Design Patterns Elements of Reusable Object-Oriented Software* was written to help software developers to think about software design problems in a different way:
From just writing a minimum adhoc solution for the problem at hand to stepping back and to think about how to solve the problem in a way that improves longterm qualities like extensibilty, flexibility, maintenability, testability and comprehensibility of a software design.

The GoF and other researches in the pattern area did "pattern mining": they examined code of experienced software developers and looked for recurring structures and solutions. The patterns they distilled by this process are thus *reusable abstractions* for structuring object-oriented software to achieve the above mentioned goals.

So while the original design patterns are formulated with object oriented languages in mind, they still adress universal problems in software engineering: decoupling of layers, configuration, dependency management, data composition, data traversal, handling state, variation of behaviour, etc.

So it comes with little surprise that we can map many of those patterns to commonly used structures in functional programming: The domain problems remain the same, yet the concrete solutions differ:

- Some patterns are absorbed by language features:
- Template method and strategy pattern are no brainers in any functional language with functions as first class citizens and higher order functions.
- Dependency Injection and Configuration is solved by partial application of curried functions.
- Adapter layers are replaced by function composition
- Visitor pattern and Interpreters are self-evident with algebraic data types.

- Other patterns are covered by libraries like the Haskell type classes:
- Composite is reduced to a Monoid
- Singleton, Pipeline, NullObject can be rooted in Functor, Applicative Functor and Monad
- Visitor and Iterator are covered by Foldable and Traversable.

- Yet another category of patterns is covered by specific language features like Lazy Evaluation, Parallelism. These features may be specific to certain languages.
- Laziness allows to work with non-terminating compuations and data structures of infinite size.
- Parallelism allows to scale the execution of a program transparently across CPU cores.

What really struck me in the course of writing this study was that so many of the Typeclassopedia type classes could be related to Design Patterns.

Most of these type classes stem from abstract algebra and category theory in particular.
Take for instance the `Monoid`

type class which is a 1:1 representation of the monoid of abstract algebra.
Identifying the composite pattern as an application of a monoidal data structure was an eye opener for me:

*Design patterns reflect abstract algebraic structures.*

As another example take the Map-Reduce pattern: we demonstrated that the question whether a problem can be
solved by a map-reduce approach boils down to the algebraic question whether the data structure used to hold the intermediary
results of the `map`

operation forms a *monoid* under the `reduce`

operation.

Rooting design patterns in abstract algebra brings a higher level of confidence to software design as we can move from 'hand waving' – painting UML diagrams, writing prose, building prototypes, etc. – to mathematical reasoning.

Mark Seemann has written an instructive series of articles on the coincidence of design patterns with abstract algebra: From Design Patterns to Category Theory.

Jeremy Gibbons has also written several excellent papers on this subject:

Design patterns are reusable abstractions in object-oriented software. However, using current mainstream programming languages, these elements can only be expressed extra-linguistically: as prose,pictures, and prototypes. We believe that this is not inherent in the patterns themselves, but evidence of a lack of expressivity in the languages of today. We expect that, in the languages of the future, the code parts of design patterns will be expressible as reusable library components. Indeed, we claim that the languages of tomorrow will suffice; the future is not far away. All that is needed, in addition to commonly-available features, are higher-order and datatype-generic constructs; these features are already or nearly available now.

Quoted from Design Patterns as Higher-Order Datatype-Generic Programs

He also maintains a blog dedicated to patterns in functional programming.

I'd like to conclude this section with a quote from Martin Menestrets FP blog:

[...] there is this curious thing called Curry–Howard correspondence which is a direct analogy between mathematical concepts and computational calculus [...].

This correspondence means that a lot of useful stuff discovered and proven for decades in Math can then be transposed to programming, opening a way for a lot of extremely robust constructs for free.

In OOP, Design patterns are used a lot and could be defined as idiomatic ways to solve a given problems, in specific contexts but their existences won’t save you from having to apply and write them again and again each time you encounter the problems they solve.

Functional programming constructs, some directly coming from category theory (mathematics), solve directly what you would have tried to solve with design patterns.

Quoted from Geekocephale

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