{-# OPTIONS -vtc.def:10 #-}
open import Cat.Univalent.Instances.Opposite
open import Cat.Diagram.Colimit.Base
open import Cat.Diagram.Limit.Base
open import Cat.Functor.Properties
open import Cat.Instances.Elements
open import Cat.Instances.Functor
open import Cat.Diagram.Terminal
open import Cat.Morphism.Duality
open import Cat.Diagram.Initial
open import Cat.Functor.Hom
open import Cat.Prelude

import Cat.Instances.Elements.Covariant as Co
import Cat.Reasoning

module Cat.Functor.Hom.Representable {o κ} {C : Precategory o κ} where

private
  module C = Cat.Reasoning C
  module C^ = Cat.Reasoning Cat[ C ^op , Sets κ ]
  module [C,Sets] = Cat.Reasoning Cat[ C , Sets κ ]
  module Sets = Cat.Reasoning (Sets κ)
open Element-hom
open Functor
open Element
open _=>_

Representable functors🔗

A functor $F : \mathcal{C}^{\mathrm{op}} \to \mathbf{Sets}_\kappa$ (from a locally $\kappa$-small category) is said to be representable when it is naturally isomorphic to $\mathbf{Hom}(-, X)$ for an object $X : \mathcal{C}$ (called the representing object) — that is, the functor $F$ classifies the maps into $X$. Note that we can evidently dualise the definition, to get what is called a corepresentable functor, one of the form $\mathbf{Hom}(X, -)$, but we refer informally to both of these situations as “representables” and “representing objects”.

record Representation (F : Functor (C ^op) (Sets κ)) : Type (o ⊔ κ) where
  no-eta-equality
  field
    rep        : C.Ob
    represents : F ≅ⁿ Hom-into C rep

  module rep = Isoⁿ represents

  equiv : ∀ {a} → C.Hom a rep ≃ ∣ F .F₀ a ∣
  equiv = Iso→Equiv λ where
    .fst                → rep.from .η _
    .snd .is-iso.inv    → rep.to .η _
    .snd .is-iso.rinv x → rep.invr ηₚ _ $ₚ x
    .snd .is-iso.linv x → rep.invl ηₚ _ $ₚ x

  module Rep {a} = Equiv (equiv {a})

open Representation
open Representation using (module Rep) public

This definition is deceptively simple: the idea of representable functor (and of representing object) is key to understanding the idea of universal property, which could be called the most important concept in category theory. Most constructions in category theory specified in terms of the existence of certain maps are really instances of representing objects for functors: limits, colimits, coends, adjoint functors, Kan extensions, etc.

The first thing we will observe is an immediate consequence of the Yoneda lemma: representing objects are unique. Intuitively this is because “$X$ is a representation of $F$” determines how $X$ reacts to being mapped into, and since the only thing we can probe objects in an arbitrary category by are morphisms, two objects which react to morphisms in the same way must be isomorphic.

representation-unique : {F : Functor (C ^op) (Sets κ)} (X Y : Representation F)
                      → X .rep C.≅ Y .rep
representation-unique X Y =
  is-ff→essentially-injective {F = よ C} (よ-is-fully-faithful C) よX≅よY where
    よX≅よY : よ₀ C (X .rep) C^.≅ よ₀ C (Y .rep)
    よX≅よY = (X .represents C^.Iso⁻¹) C^.∘Iso Y .represents

Therefore, if $\mathcal{C}$ is a univalent category, then the type of representations for a functor $F$ is a proposition. This does not follow immediately from the lemma above: we also need to show that the isomorphism computed by the full-faithfulness of the Yoneda embedding commutes with the specified representation isomorphism. This follows by construction, but the proof needs to commute applications of functors and paths-from-isos, which is never pretty:

Representation-is-prop : ∀ {F} → is-category C → is-prop (Representation F)
Representation-is-prop {F = F} c-cat x y = path where
  module X = Representation x
  module Y = Representation y

  objs : X.rep ≡ Y.rep
  objs = c-cat .to-path (representation-unique x y)

  path : x ≡ y
  path i .rep = objs i
  path i .represents =
    C^.≅-pathp refl (ap (よ₀ C) objs) {f = X.represents} {g = Y.represents}
      (Nat-pathp _ _ λ a → Hom-pathp-reflr (Sets _)
        {A = F .F₀ a} {q = λ i → el! (C.Hom a (objs i))}
        (funext λ x →
           ap (λ e → e .Sets.to) (ap-F₀-iso c-cat (Hom-from C a) _) $ₚ _
        ·· sym (Y.rep.to .is-natural _ _ _) $ₚ _
        ·· ap Y.Rep.from (sym (X.rep.from .is-natural _ _ _ $ₚ _)
                       ·· ap X.Rep.to (C.idl _)
                       ·· X.Rep.ε _)))
     i

As terminal objects🔗

We begin to connect the idea of representing objects to other universal constructions by proving this alternative characterisation of representations: A functor $F$ is representable if, and only if, its category of elements $\int F$ has a terminal object.

terminal-element→representation
  : {F : Functor (C ^op) (Sets κ)}
  → Terminal (∫ C F) → Representation F
terminal-element→representation {F} term = f-rep where
  module F = Functor F
  open Terminal term

From the terminal object in $\int F$¹, we obtain a natural transformation $\eta_y : F(y) \to \mathbf{Hom}(y,X)$, given componentwise by interpreting each pair $(y, s)$ as an object of $\int F$, then taking the terminating morphism $(y, s) \to (X, F(X))$, which satisfies (by definition) $F(!)(F(X)) = s$. This natural transformation is componentwise invertible, as the calculation below shows, so it constitutes a natural isomorphism.

  nat : F => よ₀ C (top .ob)
  nat .η ob section = has⊤ (elem ob section) .centre .hom
  nat .is-natural x y f = funext λ sect → ap hom $ has⊤ _ .paths $ elem-hom _ $
    F.₁ (has⊤ _ .centre .hom C.∘ f) (top .section)   ≡⟨ happly (F.F-∘ _ _) _ ⟩≡
    F.₁ f (F.₁ (has⊤ _ .centre .hom) (top .section)) ≡⟨ ap (F.₁ f) (has⊤ _ .centre .commute) ⟩≡
    F.₁ f sect                                       ∎

  inv : ∀ x → Sets.is-invertible (nat .η x)
  inv x = Sets.make-invertible
    (λ f → F.₁ f (top .section))
    (funext λ x → ap hom $ has⊤ _ .paths (elem-hom x refl))
    (funext λ x → has⊤ _ .centre .commute)

  f-rep : Representation F
  f-rep .rep = top .ob
  f-rep .represents = C^.invertible→iso nat $
    invertible→invertibleⁿ nat inv

In the other direction, we take the terminal element to be the image of the identity on the representing object.

representation→terminal-element
  : {F : Functor (C ^op) (Sets κ)}
  → Representation F → Terminal (∫ C F)
representation→terminal-element {F} F-rep = term where
  module F = Functor F
  module R = rep F-rep
  open Terminal

  term : Terminal (∫ C F)
  term .top .ob = F-rep .rep
  term .top .section = R.from .η _ C.id
  term .has⊤ (elem o s) .centre .hom = R.to .η _ s
  term .has⊤ (elem o s) .centre .commute =
    F.₁ (R.to .η o s) (R.from .η _ C.id) ≡˘⟨ R.from .is-natural _ _ _ $ₚ _ ⟩≡˘
    R.from .η _ ⌜ C.id C.∘ R.to .η o s ⌝ ≡⟨ ap! (C.idl _) ⟩≡
    R.from .η _ (R.to .η o s)            ≡⟨ R.invr ηₚ o $ₚ s ⟩≡
    s                                    ∎
  term .has⊤ (elem o s) .paths h = Element-hom-path _ _ $
    R.to .η o ⌜ s ⌝                  ≡˘⟨ ap¡ comm ⟩≡˘
    R.to .η o (R.from .η _ (h .hom)) ≡⟨ R.invl ηₚ o $ₚ _ ⟩≡
    h .hom                           ∎
    where
      comm =
        R.from .η _ ⌜ h .hom ⌝          ≡˘⟨ ap¡ (C.idl _) ⟩≡˘
        R.from .η _ (C.id C.∘ h .hom)   ≡⟨ R.from .is-natural _ _ _ $ₚ _ ⟩≡
        F.₁ (h .hom) (R.from .η _ C.id) ≡⟨ h .commute ⟩≡
        s                               ∎

Universal constructions🔗

In particular, we can show that terminal objects are representing objects for a particular functor. Consider, to be more specific, the constant functor $F : \mathcal{C}^{\mathrm{op}} \to \mathbf{Sets}$ which sends everything to the terminal set. When is $F$ representable?

Well, unfolding the definition, it’s when we have an object $X : \mathcal{C}$ with a natural isomorphism $\mathbf{Hom}(-,X) \cong F$. Unfolding that, it’s an object $X$ for which, given any other object $Y$, we have an isomorphism of sets $\mathbf{Hom}(Y,X) \cong \{*\}$². Hence, a representing object for the “constantly $\{*\}$” functor is precisely a terminal object.

representable-unit→terminal
  : Representation (Const (el (Lift _ ⊤) (hlevel ))) → Terminal C
representable-unit→terminal repr .Terminal.top = repr .rep
representable-unit→terminal repr .Terminal.has⊤ ob = retract→is-contr
  (Rep.from repr) (λ _ → lift tt) (Rep.η repr) (hlevel )

This can be seen as a special case of the construction above: $F$ is representable just when its category of elements has a terminal object, but in this case the category of elements of $F$ is just $\mathcal{C}$!

Corepresentable functors🔗

As noted earlier, we can dualise the definition of a representable functor to the covariant setting to get corepresentable functors.

record Corepresentation (F : Functor C (Sets κ)) : Type (o ⊔ κ) where
  no-eta-equality
  field
    corep : C.Ob
    corepresents : F ≅ⁿ Hom-from C corep

  module corep = Isoⁿ corepresents

  coequiv : ∀ {a} → C.Hom corep a ≃ ∣ F .F₀ a ∣
  coequiv = Iso→Equiv λ where
    .fst → corep.from .η _
    .snd .is-iso.inv → corep.to .η _
    .snd .is-iso.rinv x → corep.invr ηₚ _ $ₚ x
    .snd .is-iso.linv x → corep.invl ηₚ _ $ₚ x

  module Corep {a} = Equiv (coequiv {a})

open Corepresentation
open Corepresentation using (module Corep) public

Much like their contravariant cousins, corepresenting objects are unique up to isomorphism.

corepresentation-unique
  : {F : Functor C (Sets κ)} (X Y : Corepresentation F)
  → X .corep C.≅ Y .corep

corepresentation-unique X Y =
  is-ff→essentially-injective {F = Functor.op (よcov C)}
    (よcov-is-fully-faithful C)
    (iso→co-iso (Cat[ C , Sets κ ]) ni)
  where
    ni : Hom-from C (Y .corep) ≅ⁿ Hom-from C (X .corep)
    ni = (Y .corepresents ni⁻¹) ∘ni X .corepresents

This implies that the type of corepresentations is a proposition when $\mathcal{C}$ is univalent.

Corepresentation-is-prop : ∀ {F} → is-category C → is-prop (Corepresentation F)

Corepresentation-is-prop {F = F} c-cat X Y = path where

  objs : X .corep ≡ Y .corep
  objs = c-cat .to-path (corepresentation-unique X Y)

  path : X ≡ Y
  path i .corep = objs i
  path i .corepresents =
    [C,Sets].≅-pathp refl (ap (Hom-from C) objs)
       {f = X .corepresents} {g = Y .corepresents}
       (Nat-pathp _ _ λ a → Hom-pathp-reflr (Sets _)
         {A = F .F₀ a} {q = λ i → el! (C.Hom (objs i) a)}
         (funext λ x →
           ap (λ e → e .Sets.to) (ap-F₀-iso (opposite-is-category c-cat) (Hom-into C a) _) $ₚ _
           ·· sym (corep.to Y .is-natural _ _ _ $ₚ _)
           ·· ap (Corep.from Y) (sym (corep.from X .is-natural _ _ _ $ₚ _)
                                 ·· ap (Corep.to X) (C.idr _)
                                 ·· Corep.ε X _)))
       i

Dualising the representable case, we have that a functor is corepresentable if and only if its covariant category of elements has an initial object.

initial-element→corepresentation
  : {F : Functor C (Sets κ)}
  → Initial (Co.∫ C F) → Corepresentation F

corepresentation→initial-element
  : {F : Functor C (Sets κ)}
  → Corepresentation F → Initial (Co.∫ C F)

initial-element→corepresentation {F} init = f-corep where
  module F = Functor F
  open Initial init
  open Co.Element
  open Co.Element-hom
  nat : F => Hom-from C (bot .ob)
  nat .η ob section = has⊥ (Co.elem ob section) .centre .hom
  nat .is-natural x y f = funext λ sect → ap hom $ has⊥ _ .paths $ Co.elem-hom _ $
    F.₁ (f C.∘ has⊥ _ .centre .hom) (bot .section)   ≡⟨ happly (F.F-∘ _ _) _ ⟩≡
    F.₁ f (F.₁ (has⊥ _ .centre .hom) (bot .section)) ≡⟨ ap (F.₁ f) (has⊥ _ .centre .commute) ⟩≡
    F.₁ f sect                                       ∎

  inv : ∀ x → Sets.is-invertible (nat .η x)
  inv x = Sets.make-invertible
    (λ f → F.₁ f (bot .section))
    (funext λ x → ap hom $ has⊥ _ .paths (Co.elem-hom x refl))
    (funext λ x → has⊥ _ .centre .commute)

  f-corep : Corepresentation F
  f-corep .corep = bot .ob
  f-corep .corepresents = [C,Sets].invertible→iso nat $
    invertible→invertibleⁿ nat inv

corepresentation→initial-element {F} F-corep = init where
  module F = Functor F
  module R = corep F-corep
  open Initial
  open Co.Element
  open Co.Element-hom

  init : Initial (Co.∫ C F)
  init .bot .ob = F-corep .corep
  init .bot .section = R.from .η _ C.id
  init .has⊥ (Co.elem o s) .centre .hom = R.to .η _ s
  init .has⊥ (Co.elem o s) .centre .commute =
    F.₁ (R.to .η o s) (R.from .η _ C.id) ≡˘⟨ R.from .is-natural _ _ _ $ₚ _ ⟩≡˘
    R.from .η _ ⌜ R.to .η o s C.∘ C.id ⌝ ≡⟨ ap! (C.idr _) ⟩≡
    R.from .η _ (R.to .η o s)            ≡⟨ R.invr ηₚ o $ₚ s ⟩≡
    s                                    ∎
  init .has⊥ (Co.elem o s) .paths h = Co.Element-hom-path _ _ $
    R.to .η o ⌜ s ⌝                  ≡˘⟨ ap¡ comm ⟩≡˘
    R.to .η o (R.from .η _ (h .hom)) ≡⟨ R.invl ηₚ o $ₚ _ ⟩≡
    h .hom                           ∎
    where
      comm =
        R.from .η _ ⌜ h .hom ⌝          ≡˘⟨ ap¡ (C.idr _) ⟩≡˘
        R.from .η _ (h .hom C.∘ C.id)   ≡⟨ R.from .is-natural _ _ _ $ₚ _ ⟩≡
        F.₁ (h .hom) (R.from .η _ C.id) ≡⟨ h .commute ⟩≡
        s                               ∎

Corepresentable functors preserve limits🔗

A useful fact about corepresentable functors is that they preserve all limits. To show this, we first need to show that the covariant hom functor $\mathcal{C}(x,-)$ preserves limits.

To get an intuition for why this is true, consider how the functor $\mathcal{C}(x,-)$ behaves on products. The set of morphisms $\mathcal{C}(x,a \times b)$ is equivalent to the set $\mathcal{C}(x, a) \times \mathcal{C}(x, b)$ of pairs of morphisms (See product-repr for a proof of this equivalence).

Hom-from-preserves-limits
  : ∀ {o' κ'}
  → (c : C.Ob)
  → is-continuous o' κ' (Hom-from C c)
Hom-from-preserves-limits c {Diagram = Dia} {K} {eps} lim =
  to-is-limitp ml (funext λ _ → refl) where
  open make-is-limit
  module lim = is-limit lim

  ml : make-is-limit _ _
  ml .ψ j f = lim.ψ j C.∘ f
  ml .commutes f = funext λ g →
    C.pulll (sym (eps .is-natural _ _ _))
    ∙ (C.elimr (K .F-id) C.⟩∘⟨refl)
  ml .universal eta p x =
    lim.universal (λ j → eta j x) (λ f → p f $ₚ x)
  ml .factors _ _ = funext λ _ →
    lim.factors _ _
  ml .unique eps p other q = funext λ x →
    lim.unique _ _ _ λ j → q j $ₚ x

Preservation of limits by corepresentable functors then follows from a general fact about functors: if $F$ preserves limits, and $F$ is naturally isomorphic to $F'$, then $F'$ must also preserve limits.

corepresentable-preserves-limits
  : ∀ {o' κ'} {F}
  → Corepresentation F
  → is-continuous o' κ' F
corepresentable-preserves-limits F-corep lim =
   natural-iso→preserves-limits
     (F-corep .corepresents ni⁻¹)
     (Hom-from-preserves-limits (F-corep .corep))
     lim

We can show a similar fact for representable functors, but with a twist: they reverse colimits! This is due to the fact that a representable functor $F : \mathcal{C}^{\mathrm{op}} \to \mathbf{Sets}$ is contravariant. Specifically, $F$ will take limits in $\mathcal{C}^{\mathrm{op}}$ to limits in $\mathbf{Sets}$, but limits in $\mathcal{C}^{\mathrm{op}}$ are colimits, so $F$ will take colimits in $\mathcal{C}$ to limits in $\mathbf{Sets}$.

A less formal perspective on this is that the collection of maps out of a colimit is still defined as a limit in $\mathbf{Sets}$. For instance, to give a $a + b \to x$ out of a coproduct, we are required to give a pair of maps $a \to x$ and $b \to x$.

よ-reverses-colimits
  : ∀ {o' κ'}
  → (c : C.Ob)
  → is-cocontinuous o' κ' (Functor.op (よ₀ C c))
よ-reverses-colimits c {Diagram = Dia} {K} {eta} colim =
  to-is-colimitp mc (funext λ _ → refl) where
  open make-is-colimit
  module colim = is-colimit colim

  mc : make-is-colimit _ _
  mc .ψ j f = f C.∘ colim.ψ j
  mc .commutes f = funext λ g →
    C.pullr (eta .is-natural _ _ _)
    ∙ (C.refl⟩∘⟨ C.eliml (K .F-id))
  mc .universal eps p x =
    colim.universal (λ j → eps j x) (λ f → p f $ₚ x)
  mc .factors eps p = funext λ _ →
    colim.factors _ _
  mc .unique eps p other q = funext λ x →
    colim.unique _ _ _ λ j → q j $ₚ x

representable-reverses-colimits
  : ∀ {o' κ'} {F}
  → Representation F
  → is-cocontinuous o' κ' (Functor.op F)
representable-reverses-colimits F-rep colim =
  natural-iso→preserves-colimits
    ((F-rep .represents ni^op) ni⁻¹)
    (よ-reverses-colimits (F-rep .rep))
    colim