User:Michiexile/MATH198/Lecture 7
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Last week we saw what an adjunction was. Here's one thing we can do with adjunctions.
Now, let U be a left adjoint to F. We set T = UF. Then we have natural transformations
 μ:UFUF − > UF
 μ_{X} = Uε_{FX}
 ι:1 − > UF
 ι_{X} = η_{X}
such that μ is associative and ι is the unit of μ.
These requirements remind us of the definition of a monoid  and this is not that much of a surprise. To see the exact connection, and to garner a wider spread of definitions.
Contents 
1 Algebraic objects in categories
We recall the definition of a monoid:
Definition A monoid is a set M equipped with an operation that we call composition and an operation that we call the identity, such that
 (associativity)
 (unity)
We can move this definition out of the category of sets by defining a monoid object in a category:
Definition A monoid object in a category C with terminal object and pairwise products is an object M equipped with morphisms and such that
 (associativity)
 (unity)
As an example, a monoid object in Set is just a monoid. A monoid object in the category of abelian groups is a ring.
And the composition UF for an adjoint pair is a monoid object in the category of endofunctors on the category.
The same kind of construction can be made translating familiar algebraic definitions into categorical constructions with many different groups of definitions. For groups, the corresponding definition introduces a diagonal map , and an inversion map to codify the entire definition.
One framework that formalizes the whole thing, in such a way that the definitions themselves form a category is the theory of Sketches by Charles Wells. In one formulation we get the following definition:
Definition A sketch S = (G,D,L,K) consists of a graph G, a set of diagrams D, a set L of cones in G and a set K of cocones in G.
A model of a sketch S in a category C is a graph homomorphism such that the image of each diagram in D is commutative, each of the cones is a limit cone and each of the cocones is a colimit cocone.
A homomorphism of models is just a natural transformation between the models.
We thus define a monad in a category C to be a monoid object in the category of endofunctors on that category.
We can take this definition and write it out in Haskell code, as:
class Functor m => MathematicalMonad m where return :: a > m a join :: m (m a) > m a  such that join . fmap return = id :: m a > m a join . return = id :: m a > m a join . join = join . fmap join :: m (m (m a)) > m a
The secret of the connection between the two lies in the Kleisli category, and a way to build adjunctions out of monads as well as monads out of adjunctions.
2 Kleisli category
We know that an adjoint pair will give us a monad. But what about getting an adjoint pair out of a monad? Can we reverse the process that got us the monad in the first place?
There are several different ways to do this. Awodey uses the EilenbergMoore category which has as objects the algebras of the monad T: morphisms . A morphism is just some morphism in the category C such that .
We require of Talgebras two additional conditions:
 (unity)
 (associativity)
There is a forgetful functor that takes some h to t(h), picking up the object of the Talgebra. Thus , and U(f) = f.
We shall construct a left adjoint F to this from the data of the monad T by setting , making TC the corresponding object. And plugging the corresponding data into the equations, we get:
which we recognize as the axioms of unity and associativity for the monad.
(diagrams both here and above?)
By working through the details of proving this to be an adjunction, and examining the resulting composition, it becomes clear that this is in fact the original monad T. However  while the EilenbergMoore construction is highly enlightening for constructing formal systems for algebraic theories, and even for the fixpoint definitions of data types, it is less enlightening to understand Haskell's monad definition.
To get to terms with the Haskell approach, we instead look to a different construction aiming to fulfill the same aim: the Kleisli category:
Given a monad T over a category C, equipped with unit η and concatenation μ, we shall construct a new category K(T), and an adjoint pair of functors U,F factorizing the monad into T = UF.
We first define K(T)_{0} = C_{0}, keeping the objects from the original category.
Then, we set K(T)_{1} to be the collection of arrows, in C, on the form .
The composition of with is given by the sequence
The identity is the arrow . The identity property follows directly from the unity axiom for the monad, since η_{A} composing with μ_{A} is the identity.
Given this category, we next define the functors:
 U(A) = TA
 F(A) = A
This definition makes U,F an adjoint pair. Furthermore, we get
 UF(A) = U(A) = TA
 , and by naturality of μ, we can rewrite this as
 by unitality of η.
Hence, the composite UF really is just the original monad functor T.
But what's the big deal with this? you may ask. The big deal is that we now have a monad specification with a different signature.
((TALK TO VAUGHAN HERE!!))
List: return x = [x] join (l:lsts) = l ++ join lsts Maybe: return x = Just x join (Just (Just x)) = Just x join _ = Nothing
Note: not quite what Haskell claims a monad to be. Other related concepts:
 Kleisli category & factorization of monads: if we start with T a
monad, then can we find an adjunction U  F to _somewhere_ such that T = UF? And the monoidal structure is given by U e_FX and eta_X?
 From the Kleisli Category to monadic bind.
 Monads and sequencing.
3 Homework
 Prove that the Kleisli category adjunction is an adjunction.
 Prove that the EilenbergMoore category adjunction is an adjunction.
 The writer monad is defined byW
 data Monoid m => W m x = W (x, m)
 fmap f (W (x, m)) = W (f x, m)
#* <hask>return x = W (x, mempty)  join (W (W (x, m), n)) = W (x, m `mappend` n)
 (2pt) Prove that this yields a monad.
 (2pt) Give the Kleisli factorization of the writer monad.
 (2pt) Give the EilenbergMoore factorization of the writer monad.

4 Some adjunctions we already know
 initial/terminal are adjunctions.
 (co)products are adjunctions.
 Actually, all (co)limits are adjunctions.
5 Some adjunctions we don't know yet
 Existential and universal qualifiers as adjunctions.
 Powersets and im(f)  f^\inv
6 Properties of adjoints
6.1 RAPL: Right Adjoints Preserve Limits
6.2 Recognizing adjoints
Theorem (Freyd: The Adjoint Functor Theorem)