open import 1Lab.Prelude

open import Data.Maybe.Properties
open import Data.Set.Coequaliser
open import Data.Fin.Properties
open import Data.Nat.Properties
open import Data.Nat.DivMod
open import Data.Nat.Order
open import Data.Fin.Base
open import Data.Nat.Base as Nat
open import Data.Dec
open import Data.Irr
open import Data.Sum

open import Meta.Invariant

module Data.Fin.Closure where

private variable
  ℓ : Level
  A B C : Type ℓ
  k l m n : Nat

Closure of finite sets🔗

In this module, we prove that the finite sets are closed under “typal arithmetic”: The initial and terminal objects are finite (they have 1 and 0 elements respectively), products of finite sets are finite, coproducts of finite sets are finite, and functions between finite sets are finite. Moreover, these operations all correspond to arithmetic operations on the natural number indices: $[n] ⊎ [m] = [n + m],$ etc.

Zero, one, successors🔗

The finite set $[0]$ is an initial object, and the finite set $[1]$ is a terminal object:

Finite-zero-is-initial : Fin 0 ≃ ⊥
Finite-zero-is-initial .fst ()
Finite-zero-is-initial .snd .is-eqv ()

Finite-one-is-contr : is-contr (Fin 1)
Finite-one-is-contr .centre = fzero
Finite-one-is-contr .paths i with fin-view i
... | zero = refl

The successor operation on indices corresponds to taking coproducts with the unit set.

Finite-successor : Fin (suc n) ≃ (⊤ ⊎ Fin n)
Finite-successor {n} = Fin-suc ∙e Maybe-is-sum

Addition🔗

For binary coproducts, we prove the correspondence with addition in steps, to make the proof clearer:

module _ where private

  Finite-coproduct : (Fin n ⊎ Fin m) ≃ Fin (n + m)
  Finite-coproduct {zero} {m}  =
    (Fin 0 ⊎ Fin m) ≃⟨ ⊎-apl Finite-zero-is-initial ⟩≃
    (⊥ ⊎ Fin m)     ≃⟨ ⊎-zerol ⟩≃
    Fin m           ≃∎
  Finite-coproduct {suc n} {m} =
    (Fin (suc n) ⊎ Fin m) ≃⟨ ⊎-apl Finite-successor ⟩≃
    ((⊤ ⊎ Fin n) ⊎ Fin m) ≃⟨ ⊎-assoc ⟩≃
    (⊤ ⊎ (Fin n ⊎ Fin m)) ≃⟨ ⊎-apr (Finite-coproduct {n} {m}) ⟩≃
    (⊤ ⊎ Fin (n + m))     ≃⟨ Finite-successor e⁻¹ ⟩≃
    Fin (suc (n + m))     ≃∎

Finite-coproduct : ∀ {m n} → (Fin m ⊎ Fin n) ≃ Fin (m + n)
Finite-coproduct {m} {n} = Iso→Equiv (to , iso from ir il) where
  to : Fin m ⊎ Fin n → Fin (m + n)
  to (inl x) = record
    { lower   = x .lower
    ; bounded = forget (≤-trans (to-ℕ< x .snd) (+-≤l m n))
    }
  to (inr (fin i ⦃ forget α ⦄)) =
    let
      .p : m + i Nat.< m + n
      p = ≤-trans (≤-refl' (sym (+-sucr m i))) (+-preserves-≤ m m (suc _) n ≤-refl α)
    in record
      { lower   = m + i
      ; bounded = forget p
      }

  from : Fin (m + n) → Fin m ⊎ Fin n
  from (fin i ⦃ forget b ⦄) with holds? (i Nat.< m)
  ... | yes p = inl (fin i ⦃ forget p ⦄)
  ... | no ¬p =
    let
      p' : m Nat.≤ i
      p' = ≤-peel (<-from-not-≤ _ _ ¬p)

      q : i - m Nat.≤ i
      q = monus-≤ i m

      .r : i - m Nat.< n
      r = +-reflects-≤l (suc (i - m)) n m (≤-trans (≤-refl' (+-sucr m (i - m))) (≤-trans (≤-refl' (ap suc (monus-inversel i m p'))) b))
    in inr (fin (i - m) ⦃ forget r ⦄)

  ir : is-right-inverse from to
  ir (fin i ⦃ forget b ⦄) with holds? (i Nat.< m)
  ... | yes p = fin-ap refl
  ... | no ¬p = fin-ap (monus-inversel i m (≤-peel (<-from-not-≤ _ _ ¬p)))

  il : is-left-inverse from to
  il (inl (fin i ⦃ forget b ⦄)) with holds? (i Nat.< m)
  ... | yes p = refl
  ... | no ¬p = absurd (¬p b)
  il (inr (fin i ⦃ forget b ⦄)) with holds? ((m + i) Nat.< m)
  ... | yes p = absurd (¬sucx≤x m (+-reflects-≤l (suc m) m i (≤-trans (≤-refl' (+-sucr i m ∙ ap suc (+-commutative i m))) (≤-trans p (+-≤r i m)))))
  ... | no ¬p = ap inr (fin-ap (monus-inverser i m))

Sums🔗

We also have a correspondence between “coproducts” and “addition” in the iterated case: If you have a family of finite types (represented by a map to their cardinalities), the dependent sum of that family is equivalent to the iterated binary sum of the cardinalities:

sum : ∀ n → (Fin n → Nat) → Nat
sum zero f = zero
sum (suc n) f = f fzero + sum n (f ∘ fsuc)

Finite-sum : (B : Fin n → Nat) → Σ (Fin _) (Fin ∘ B) ≃ Fin (sum n B)
Finite-sum {zero} B .fst ()
Finite-sum {zero} B .snd .is-eqv ()
Finite-sum {suc n} B =
  Σ (Fin (suc n)) (Fin ∘ B)              ≃⟨ Fin-suc-Σ ⟩≃
  Fin (B 0) ⊎ Σ (Fin n) (Fin ∘ B ∘ fsuc) ≃⟨ ⊎-apr (Finite-sum (B ∘ fsuc)) ⟩≃
  Fin (B 0) ⊎ Fin (sum n (B ∘ fsuc))     ≃⟨ Finite-coproduct ⟩≃
  Fin (sum (suc n) B)                    ≃∎

Multiplication🔗

Recall (from middle school) that the product $n \times m$ is the same thing as summing together $n$ copies of the number $m .$ Correspondingly, we can use the theorem above for general sums to establish the case of binary products:

module _ where private

  Finite-multiply : (Fin n × Fin m) ≃ Fin (n * m)
  Finite-multiply {n} {m} =
    (Fin n × Fin m)       ≃⟨ Finite-sum (λ _ → m) ⟩≃
    Fin (sum n (λ _ → m)) ≃⟨ path→equiv (ap Fin (sum≡* n m)) ⟩≃
    Fin (n * m)           ≃∎
    where
      sum≡* : ∀ n m → sum n (λ _ → m) ≡ n * m
      sum≡* zero m = refl
      sum≡* (suc n) m = ap (m +_) (sum≡* n m)

Finite-multiply : ∀ {m n} → (Fin m × Fin n) ≃ Fin (m * n)
Finite-multiply {zero} {n} = fst , record { is-eqv = λ o → absurd (Fin-absurd o) }
Finite-multiply {suc n} {zero} = ((λ (_ , x) → absurd (Fin-absurd x))) , record { is-eqv = λ o → absurd (Fin-absurd (subst Fin (*-zeror n) o)) }
Finite-multiply {m@(suc m')} {n@(suc n')} = Iso→Equiv (to , iso from ir il) where
  to : Fin m × Fin n → Fin (m * n)
  to (fin i ⦃ forget b ⦄ , fin j ⦃ forget b' ⦄) = fin (i * n + j) ⦃ forget α ⦄ where
    α : i * n + j Nat.< m * n
    α =
      let
        it : i * n + j Nat.≤ m' * n + n'
        it = +-preserves-≤ (i * n) (m' * n) j n' (*-preserves-≤r i m' n (≤-peel (recover b))) (≤-peel (recover b'))
      in s≤s (≤-trans it  (≤-refl' (+-commutative (m' * n) n')))

  from : Fin (m * n) → Fin m × Fin n
  from (fin i ⦃ forget b ⦄) with divmod q r quot rem ← divide-pos i n =
    let
      .b' : q Nat.≤ m
      b' = *-cancel-≤r n {q} {m} $
        ≤-trans (difference→≤ r (sym quot)) (≤-sucr (≤-peel b))

      .ne : q ≠ m
      ne p =
        let
          p' : m * n Nat.≤ i
          p' = difference→≤ r (sym (subst (λ e → i ≡ e * suc n' + r) p quot))
        in ¬sucx≤x _ (≤-trans b p')

    in fin q ⦃ forget (<-from-≤ ne b') ⦄ , fin r ⦃ forget rem ⦄

  ir : is-right-inverse from to
  ir (fin i ⦃ forget b ⦄) = fin-ap (sym (is-divmod i n))

  il : is-left-inverse from to
  il (fin i ⦃ forget b ⦄ , fin j ⦃ forget b' ⦄) =
    let
      p : Path (DivMod (i * n + j) n) (divide-pos (i * n + j) n) (divmod i j refl b')
      p = prop!
    in fin-ap (ap DivMod.quot p) ,ₚ fin-ap (ap DivMod.rem p)

Products🔗

Similarly to the case for sums, the cardinality of a dependent product of finite sets is the product of the cardinalities:

product : ∀ n → (Fin n → Nat) → Nat
product zero f = 1
product (suc n) f = f fzero * product n (f ∘ fsuc)

Finite-product : (B : Fin n → Nat) → (∀ x → Fin (B x)) ≃ Fin (product n B)
Finite-product {zero} B .fst _ = fzero
Finite-product {zero} B .snd = is-iso→is-equiv λ where
  .is-iso.from _ ()
  .is-iso.linv _ → funext λ ()

  .is-iso.rinv fzero                      → refl
  .is-iso.rinv (fin (suc i) ⦃ forget p ⦄) → absurd (¬suc≤0 (≤-peel p))
Finite-product {suc n} B =
  (∀ x → Fin (B x))                          ≃⟨ Fin-suc-Π ⟩≃
  Fin (B fzero) × (∀ x → Fin (B (fsuc x)))   ≃⟨ Σ-ap-snd (λ _ → Finite-product (B ∘ fsuc)) ⟩≃
  Fin (B fzero) × Fin (product n (B ∘ fsuc)) ≃⟨ Finite-multiply ⟩≃
  Fin (B fzero * product n (B ∘ fsuc))       ≃∎

Permutations🔗

We show that the set of permutations $[n] ≃ [n]$ is finite with cardinality $n!$ (the factorial of $n).$

We start by showing that $([n + 1] ≃ [n + 1]) ≃ [n + 1] \times ([n] ≃ [n]) :$ a permutation of $[n + 1]$ is determined by what happens to $0$ and by the remaining permutation of $[n] .$

Fin-permutations-suc
  : ∀ n → (Fin (suc n) ≃ Fin (suc n)) ≃ (Fin (suc n) × (Fin n ≃ Fin n))
Fin-permutations-suc n = to , is-iso→is-equiv is where
  to : (Fin (suc n) ≃ Fin (suc n)) → Fin (suc n) × (Fin n ≃ Fin n)
  to e .fst = e · 0
  to e .snd .fst i = avoid (e · 0) (e · fsuc i) λ p →
    zero≠suc (ap lower (Equiv.injective e p))
  to e .snd .snd = Fin-injection→equiv _ λ p →
    fsuc-inj (Equiv.injective e (avoid-injective (e · 0) p))

  is : is-iso to
  is .is-iso.from (n , e) = record { fst = fun ; snd = Fin-injection→equiv _ inj  } module inv where
    fun : Fin (suc _) → Fin (suc _)
    fun i with fin-view i
    ... | zero  = n
    ... | suc x = skip n (e · x)

    inj : injective fun
    inj {i} {j} p with fin-view i | fin-view j
    ... | zero  | zero  = refl
    ... | zero  | suc y = absurd (skip-skips n _ (sym p))
    ... | suc i | zero  = absurd (skip-skips n _ p)
    ... | suc i | suc j = ap fsuc (Equiv.injective e (skip-injective n _ _ p))
  is .is-iso.rinv (n , e) = Σ-pathp refl (ext λ i → avoid-skip n (e · i))
  is .is-iso.linv e = ext p where
    p : ∀ x → inv.fun (e · 0) (to e .snd) x ≡ e · x
    p x with fin-view x
    ... | zero  = refl
    ... | suc i = skip-avoid (e · 0) (e · fsuc i)

We can now show that $([n] ≃ [n]) ≃ [n!]$ by induction.

Fin-permutations : ∀ n → (Fin n ≃ Fin n) ≃ Fin (factorial n)
Fin-permutations zero = is-contr→≃
  (contr id≃ λ _ → ext λ ()) Finite-one-is-contr
Fin-permutations (suc n) =
  Fin (suc n) ≃ Fin (suc n)       ≃⟨ Fin-permutations-suc n ⟩≃
  Fin (suc n) × (Fin n ≃ Fin n)   ≃⟨ Σ-ap-snd (λ _ → Fin-permutations n) ⟩≃
  Fin (suc n) × Fin (factorial n) ≃⟨ Finite-multiply ⟩≃
  Fin (factorial (suc n))         ≃∎

Decidable subsets🔗

Given a decidable predicate on $[n],$ we can compute $s$ such that $[s]$ is equivalent to the subset of $[n]$ on which the predicate holds: a decidable proposition is finite (it has either $0$ or $1$ elements), so we can reuse our proof that finite sums of finite types are finite.

Dec→Fin
  : ∀ {ℓ} {A : Type ℓ} → is-prop A → Dec A
  → Σ Nat λ n → Fin n ≃ A
Dec→Fin ap (no ¬a) .fst = 0
Dec→Fin ap (no ¬a) .snd =
  is-empty→≃ (Finite-zero-is-initial .fst) ¬a
Dec→Fin ap (yes a) .fst = 1
Dec→Fin ap (yes a) .snd =
  is-contr→≃ Finite-one-is-contr (is-prop∙→is-contr ap a)

Finite-subset
  : ∀ {n} (P : Fin n → Type ℓ)
  → ⦃ ∀ {x} → H-Level (P x) 1 ⦄
  → ⦃ dec : ∀ {x} → Dec (P x) ⦄
  → Σ Nat λ s → Fin s ≃ Σ (Fin n) P
Finite-subset {n = n} P ⦃ dec = dec ⦄ =
  sum n ns , Finite-sum ns e⁻¹ ∙e Σ-ap-snd es
  where
    ns : Fin n → Nat
    ns i = Dec→Fin (hlevel 1) dec .fst
    es : (i : Fin n) → Fin (ns i) ≃ P i
    es i = Dec→Fin (hlevel 1) dec .snd

Decidable quotients🔗

As a first step towards coequalisers, we show that the quotient of a finite set $[n]$ by a decidable congruence is finite.

Finite-quotient
  : ∀ {n ℓ} (R : Congruence (Fin n) ℓ) (open Congruence R)
  → ⦃ _ : ∀ {x y} → Dec (x ∼ y) ⦄
  → Σ Nat λ q → Fin q ≃ Fin n / _∼_

This amounts to counting the number of equivalence classes of $R .$ We proceed by induction on $n;$ the base case is trivial.

Finite-quotient {zero} R .fst = 0
Finite-quotient {zero} R .snd .fst ()
Finite-quotient {zero} R .snd .snd .is-eqv = elim! λ ()

For the induction step, we restrict $R$ along the successor map $[n] \to [n + 1]$ to get a congruence $R_{1}$ on $[n]$ whose quotient is finite.

Finite-quotient {suc n} {ℓ} R = go where
  module R = Congruence R

  R₁ : Congruence (Fin n) ℓ
  R₁ = Congruence-pullback fsuc R
  module R₁ = Congruence R₁

  n/R₁ : Σ Nat λ q → Fin q ≃ Fin n / R₁._∼_
  n/R₁ = Finite-quotient {n} R₁

In order to compute the size of the quotient $[n + 1] / R,$ we decide whether $0 : [n + 1]$ is related by $R$ to any $i + 1$ using the omniscience of finite sets.

  go
    : ⦃ Dec (Σ (Fin n) (λ i → fzero R.∼ fsuc i)) ⦄
    → Σ Nat (λ q → Fin q ≃ Fin (suc n) / R._∼_)

If so, $0$ lives in the same equivalence class as $i + 1$ and the size of the quotient remains unchanged.

  go ⦃ yes (i , r) ⦄ .fst = n/R₁ .fst
  go ⦃ yes (i , r) ⦄ .snd = n/R₁ .snd ∙e Iso→Equiv is where
    is : Iso (Fin n / R₁._∼_) (Fin (suc n) / R._∼_)
    is .fst = Coeq-rec (λ x → inc (fsuc x)) λ (x , y , s) → quot s
    is .snd .is-iso.from = Coeq-rec fn λ (i , j , s) → resp i j s where
      fn : Fin (suc n) → Fin n / R₁._∼_
      fn j with fin-view j
      ... | zero  = inc i
      ... | suc x = inc x

      resp : ∀ i j → i R.∼ j → fn i ≡ fn j
      resp i j s with fin-view i | fin-view j
      ... | zero  | zero  = refl
      ... | zero  | suc y = quot (R.symᶜ r R.∙ᶜ s)
      ... | suc x | zero  = quot (s R.∙ᶜ r)
      ... | suc x | suc y = quot s
    is .snd .is-iso.rinv = elim! (Fin-cases (quot (R.symᶜ r)) (λ _ → refl))
    is .snd .is-iso.linv = elim! λ _ → refl

Otherwise, $0$ creates a new equivalence class for itself.

  go ⦃ no ¬r ⦄ .fst = suc (n/R₁ .fst)
  go ⦃ no ¬r ⦄ .snd = Finite-successor ∙e ⊎-apr (n/R₁ .snd) ∙e Iso→Equiv is where
    to : Fin (suc n) → ⊤ ⊎ (Fin n / R₁._∼_)
    to i with fin-view i
    ... | zero  = inl _
    ... | suc x = inr (inc x)

    resp : ∀ i j → i R.∼ j → to i ≡ to j
    resp i j s with fin-view i | fin-view j
    ... | zero  | zero  = refl
    ... | zero  | suc y = absurd (¬r (y , s))
    ... | suc x | zero  = absurd (¬r (x , R.symᶜ s))
    ... | suc x | suc y = ap inr (quot s)

    is : Iso (⊤ ⊎ (Fin n / R₁._∼_)) (Fin (suc n) / R._∼_)
    is .fst (inl tt) = inc 0
    is .fst (inr x) = Coeq-rec (λ x → inc (fsuc x)) (λ (x , y , s) → quot s) x
    is .snd .is-iso.from = Coeq-rec to λ (x , y , r) → resp x y r
    is .snd .is-iso.rinv = elim! (Fin-cases refl (λ _ → refl))
    is .snd .is-iso.linv (inl tt) = refl
    is .snd .is-iso.linv (inr x) = elim x where
      elim : ∀ x → is .snd .is-iso.from (is .fst (inr x)) ≡ inr x
      elim = elim! λ _ → refl

Coequalisers🔗

Given two functions $f, g : [m] \to [n],$ we can compute $q$ such that $[q]$ is equivalent to the coequaliser of $f$ and $g .$ We start by expressing the coequaliser as the quotient of $[n]$ by the congruence generated by the relation $f (a) \sim g (a),$ so that we can apply the result above. Since this relation is clearly decidable by the omniscience of $[m],$ all that remains is to show that the closure of a decidable relation on a finite set is decidable.

instance
  Closure-Fin-Dec
    : ∀ {n ℓ} {R : Fin n → Fin n → Type ℓ}
    → ⦃ ∀ {x y} → Dec (R x y) ⦄
    → ∀ {x y} → Dec (Closure R x y)

This amounts to writing a (verified!) pathfinding algorithm: given $x, y : [n],$ we need to decide whether there is a path between $x$ and $y$ in the undirected graph whose edges are given by $R .$

We proceed by induction on $n;$ the base case is trivial, so we are left with the inductive case $[n + 1] .$ The simplest¹ way forward is to find a decidable congruence $D$ that is equivalent to the closure $R^{*} .$

We start by defining the restriction of $R$ along the successor map $[n] \to [n + 1],$ written $R_{1},$ as well as the symmetric closure of $R,$ written $R^{s} .$

  Closure-Fin-Dec {suc n} {ℓ} {R} {x} {y} = R*-dec where
    open Congruence
    module R = Congruence (Closure-congruence R)

    R₁ : Fin n → Fin n → Type _
    R₁ x y = R (fsuc x) (fsuc y)
    module R₁ = Congruence (Closure-congruence R₁)

    R₁→R : ∀ {x y} → Closure R₁ x y → Closure R (fsuc x) (fsuc y)
    R₁→R = Closure-rec-congruence R₁
      (Congruence-pullback fsuc (Closure-congruence R)) inc

    Rˢ : Fin (suc n) → Fin (suc n) → Type _
    Rˢ x y = R x y ⊎ R y x

    Rˢ→R : ∀ {x y} → Rˢ x y → Closure R x y
    Rˢ→R = [ inc , R.symᶜ ∘ inc ]

We build $D$ by cases. $D (0, 0)$ is trivial, since the closure is reflexive.

    D' : {i j : Fin (suc n)} → Fin-view i → Fin-view j → Type ℓ
    D' zero zero = Lift _ ⊤

For $D (0, y + 1),$ we use the omniscience of $[n]$ to search for an $x$ such that $R^{s} (0, x + 1)$ and $R_{1}^{*} (x, y) .$ Here we rely on the closure of $R_{1}$ being decidable by the induction hypothesis. The case $D (x + 1, 0)$ is symmetric.

    D' zero (suc y) = Σ[ x ∈ Fin n ] Rˢ 0 (fsuc x) × Closure R₁ x y
    D' (suc x) zero = Σ[ y ∈ Fin n ] Closure R₁ x y × Rˢ (fsuc y) 0

Finally, in order to decide whether $x + 1$ and $y + 1$ are related by $R^{*},$ we have two possibilities: either there is a path from $x$ to $y$ in $[n],$ which we can find using the induction hypothesis, or there are are paths from $x + 1$ to $0$ and from $0$ to $y + 1$ in $[n + 1],$ which we can find using the previous two cases.

    D' (suc x) (suc y) = Closure R₁ x y ⊎ D' (suc x) zero × D' zero (suc y)

    D : ∀ i j → Type ℓ
    D i j = D' (fin-view i) (fin-view j)

Proving that (the propositional truncation of) $D$ is a decidable congruence is tedious but not difficult.

    D-cong : Congruence (Fin (suc n)) _
    instance D-Dec : ∀ {x y} → Dec (D x y)

    D-refl : ∀ x → D x x
    D-refl i with fin-view i
    ... | zero  = _
    ... | suc x = inl R₁.reflᶜ

    D-trans : ∀ x y z → D x y → D y z → D x z
    D-trans i j k p q with fin-view i | fin-view j | fin-view k | p | q
    ... | zero  | zero  | z     | _            | d            = d
    ... | zero  | suc y | zero  | _            | _            = _
    ... | zero  | suc y | suc z | y' , ry , cy | inl c        = y' , ry , cy R₁.∙ᶜ c
    ... | zero  | suc y | suc z | _            | inr (_ , dz) = dz
    ... | suc x | zero  | zero  | d            | _            = d
    ... | suc x | zero  | suc z | dx           | dy           = inr (dx , dy)
    ... | suc x | suc y | zero  | inl c        | y' , cy , ry = y' , c R₁.∙ᶜ cy , ry
    ... | suc x | suc y | zero  | inr (dx , _) | _            = dx
    ... | suc x | suc y | suc z | inl c        | inl d = inl (c R₁.∙ᶜ d)
    ... | suc x | suc y | suc z | inl c        | inr ((y' , cy , ry) , dz) =
      inr ((y' , c R₁.∙ᶜ cy , ry) , dz)
    ... | suc x | suc y | suc z | inr (dx , (y' , ry , cy)) | inl c =
      inr (dx , y' , ry , cy R₁.∙ᶜ c)
    ... | suc x | suc y | suc z | inr (dx , dy) | inr (dy' , dz) =
      inr (dx , dz)

    D-sym : ∀ {i j} (x : Fin-view i) (y : Fin-view j) → D' x y → D' y x
    D-sym zero zero    _            = _
    D-sym zero (suc y) (y' , r , c) = y' , R₁.symᶜ c , ⊎-comm .fst r
    D-sym (suc x) zero (x' , c , r) = x' , ⊎-comm .fst r , R₁.symᶜ c
    D-sym (suc x) (suc y) (inl r)   = inl (R₁.symᶜ r)
    D-sym (suc x) (suc y) (inr (dx , dy)) =
      inr (D-sym zero (suc y) dy , D-sym (suc x) zero dx)

    D-cong ._∼_ x y = ∥ D x y ∥
    D-cong .has-is-prop _ _ = hlevel 1
    D-cong .reflᶜ {x} = inc (D-refl x)
    D-cong ._∙ᶜ_ {x} {y} {z} = ∥-∥-map₂ (D-trans x y z)
    D-cong .symᶜ {x} {y} = map (D-sym (fin-view x) (fin-view y))

    {-# INCOHERENT D-Dec #-}
    D-Dec {i} {j} with fin-view i | fin-view j
    ... | zero  | zero  = auto
    ... | zero  | suc y = auto
    ... | suc x | zero  = auto
    ... | suc x | suc y = auto

To complete the proof, we show that $D$ is indeed equivalent to $R^{*};$ it suffices to show that $D$ lies between $R$ and $R^{*} .$

    R→D : ∀ {x y} → R x y → D x y
    R→D {i} {j} r with fin-view i | fin-view j
    ... | zero  | zero  = _
    ... | zero  | suc y = y , inl r , R₁.reflᶜ
    ... | suc x | zero  = x , R₁.reflᶜ , inl r
    ... | suc x | suc y = inl (inc r)

    D→R* : ∀ {x y i j} → D' {x} {y} i j → Closure R x y
    D→R* {i = zero}  {j = zero}  _ = R.reflᶜ
    D→R* {i = zero}  {j = suc y} (y' , r , c) = Rˢ→R r R.∙ᶜ R₁→R c
    D→R* {i = suc x} {j = zero}  (x' , c , r) = R₁→R c R.∙ᶜ Rˢ→R r
    D→R* {i = suc x} {j = suc y} (inl r) = R₁→R r
    D→R* {i = suc x} {j = suc y} (inr (dx , dy)) =
      D→R* {i = suc x} {j = zero} dx R.∙ᶜ D→R* {i = zero} {suc y} dy

    R*→D : ∀ {x y} → Closure R x y → ∥ D x y ∥
    R*→D = Closure-rec-congruence R D-cong (inc ∘ R→D)

    R*-dec : Dec (Closure R x y)
    R*-dec = invmap (rec! D→R*) R*→D (holds? ∥ D x y ∥)

We can finally assemble the pieces together: given $f, g : [m] \to [n],$ the coequaliser of $f$ and $g$ is equivalent to the quotient of $[n]$ by the decidable relation $R$ induced by $f$ and $g,$ and hence by its congruence closure $R^{*} .$ But we know that quotients of finite sets by decidable congruences are finite, and we just proved that the closure of a decidable relation on a finite set is decidable, so we’re done.

Finite-coequaliser
  : ∀ {n m} (f g : Fin m → Fin n)
  → Σ Nat λ q → Fin q ≃ Coeq f g
Finite-coequaliser {n} f g
  = n/R .fst
  , n/R .snd
    ∙e Closure-quotient R e⁻¹
    ∙e Coeq≃quotient f g e⁻¹
  where
    R = span→R f g

    n/R : Σ Nat λ q → Fin q ≃ Fin n / Closure R
    n/R = Finite-quotient (Closure-congruence R)

In terms of ease of implementation; the complexity of the resulting algorithm is catastrophic.↩︎