open import 1Lab.Prelude

open import Data.Nat.Solver
open import Data.Nat
open import Data.Sum

module Data.Int where

Integers🔗

The integers are what you get when you complete the additive monoid structure on the naturals into a group. In non-cubical Agda, a representation of the integers as a coproduct $\bb{N} \coprod \bb{N}$ with one of the factors offset (to avoid having two zeroes) is adopted. In Cubical Agda we can adopt a representation much closer to a “classical” construction of the integers:

data Int : Type where
  diff : (x y : Nat) → Int
  quot : (m n : Nat) → diff m n ≡ diff (suc m) (suc n)

This is an alternative representation of the construction of integers as pairs $(x , y)\colon \bb{N}^2$ where $(a,b) = (c, d)$ iff $a + d = b + c$: An integer is an equivalence class of pairs of naturals, where $(a, b)$ is identified with $(1 + a, 1 + b)$, or, more type-theoretically, the integers are generated by the constructor diff which embeds a pair of naturals, and the path constructor quot which expresses that $(a, b)$ = $(1 + a, 1 + b)$.

This single generating path is enough to recover the “classical” quotient, which we do in steps. First, we… prove that that $n - n$ is $0$:

zeroes : (n : Nat) → diff   ≡ diff n n
zeroes zero = refl
zeroes (suc n) = zeroes n ∙ quot _ _

Additionally, offsetting a difference by a fixed natural, as long as it’s done on both sides of the difference, does not change which integer is being represented: That is, considering all three naturals as integers, $(a - b) = (n + a) - (n + b)$.

cancel : (a b n : Nat) → diff a b ≡ diff (n + a) (n + b)
cancel a b zero = refl
cancel a b (suc n) = cancel a b n ∙ quot _ _

As a final pair of helper lemmas, we find that if $n$ and $k$ differ by an absolute value of $b$, then the values $n - k$ and $b$ are the same (as long as we fix the sign — hence the two lemmas). The generic situation of “differing by $b$” is captured by fixing a natural number $a$ and adding $b$, because we have $(a + b) - a = b$ and $a - (a + b) = -b$.

offset-negative : (a b : Nat) → diff a (a + b) ≡ diff  b
offset-negative zero b = refl
offset-negative (suc a) b =
  diff (suc a) (suc (a + b)) ≡⟨ sym (quot _ _) ⟩≡
  diff a (a + b)             ≡⟨ offset-negative a b ⟩≡
  diff  b                   ∎

offset-positive : (a b : Nat) → diff (a + b) a ≡ diff b 
offset-positive zero b = refl
offset-positive (suc a) b =
  diff (suc (a + b)) (suc a) ≡⟨ sym (quot _ _) ⟩≡
  diff (a + b) a             ≡⟨ offset-positive a b ⟩≡
  diff b                    ∎

Those two are the last two lemmas we need to prove the “if” direction of “naturals are identified in the quotient iff they represent the same difference”: the construction same-difference below packages everything together with a bow on the top.

same-difference : {a b c d : Nat} → a + d ≡ b + c → diff a b ≡ diff c d
same-difference {zero} {b} {c} {d} path = sym $
  diff c ⌜ d ⌝     ≡⟨ ap! path ⟩≡
  diff c ⌜ b + c ⌝ ≡⟨ ap! (+-commutative b c) ⟩≡
  diff c (c + b)   ≡⟨ offset-negative _ _ ⟩≡
  diff  b         ∎
same-difference {suc a} {zero} {c} {d} path =
  sym ( diff ⌜ c ⌝ d         ≡⟨ ap! (sym path) ⟩≡
        diff ⌜ suc a + d ⌝ d ≡⟨ ap! (+-commutative (suc a) d) ⟩≡
        diff (d + suc a) d   ≡⟨ offset-positive _ _ ⟩≡
        diff (suc a)        ∎
      )
same-difference {suc a} {suc b} {c} {d} path =
  diff (suc a) (suc b) ≡˘⟨ quot _ _ ⟩≡˘
  diff a b             ≡⟨ same-difference (suc-inj path) ⟩≡
  diff c d             ∎

In the other direction, we must be clever: we use path induction, defining a type family $\id{Code}_{a,b}(x)$ such that the fibre of $\id{Code}_{a,b}$ over $(c, d)$ is $a + d = b + c$. We can then use path induction to construct the map inverse to same-difference. On the way, the first thing we establish is a pair of observations about equalities on the natural numbers: $a + n = b + m$ and $a + 1 + n = b + 1 + m$ are equivalent conditions. This can be seen by commutativity and injectivity of the successor function, but below we prove it using equational reasoning, without appealing to commutativity.

module ℤ-Path where
  private
    variable a b m n c d : Nat
  encode-p-from : (a + n ≡ b + m) → (a + suc n ≡ b + suc m)
  encode-p-from {a = a} {n} {b} {m} p =
    a + suc n   ≡⟨ +-sucr a n ⟩≡
    suc (a + n) ≡⟨ ap suc p ⟩≡
    suc (b + m) ≡˘⟨ +-sucr b m ⟩≡˘
    b + suc m   ∎

  encode-p-to : (a + suc n ≡ b + suc m) → (a + n ≡ b + m)
  encode-p-to {a} {n} {b} {m} p = suc-inj (sym (+-sucr a n) ∙ p ∙ +-sucr b m)

We then define, fixing two natural numbers $a, b$, the family $\id{Code}_{a,b}(x)$ by recursion on the integer $x$. Recall that we want the fibre over $\id{diff}(c, d)$ to be $a + d = b + c$, so that’s our pick. Now, the quot path constructor mandates that the fibre over $(c, d)$ be the same as that over $(1 + c, 1 + d)$ — but this follows by propositional extensionality and the pair of observations above.

  Code : ∀ (a b : Nat) (x : Int) → Type
  Code a b (diff c d) = a + d ≡ b + c
  Code a b (quot m n i) = path i where
    path : (a + n ≡ b + m) ≡ (a + suc n ≡ b + suc m)
    path = ua (prop-ext (Nat-is-set _ _) (Nat-is-set _ _) encode-p-from encode-p-to)

Hence, if we have a path $\id{diff}(a, b) = x$, we can apply path induction, whence it suffices to consider the case where $x$ is literally_ the difference of $a$ and $b$. To lift this into our Code fibration, we must show that $a + b = b + a$, but this is exactly commutativity of addition on $\bb{N}$.

  encode : ∀ (a b : Nat) (x : Int) → diff a b ≡ x → Code a b x
  encode a b x = J (λ x p → Code a b x) (+-commutative a b)

As a finishing touch, we give Int instances for Number and Negative, meaning that we can use positive and negative integer literals to denote values of Int.

instance
  Number-Int : Number Int
  Number-Int .Number.Constraint _ = ⊤
  Number-Int .Number.fromNat n = diff n 

  Negative-Int : Negative Int
  Negative-Int .Negative.Constraint _ = ⊤
  Negative-Int .Negative.fromNeg n = diff  n

Canonical representatives🔗

Initially, we note that the type of integers admits a surjection from the type $\bb{N} \to \bb{N}$, given by sending each pair of naturals to their difference.

private
  difference-surjection : ∀ x → ∃[ (a , b) ∈ Nat × Nat ] (diff a b ≡ x)
  difference-surjection (diff x y) = inc ((x , y) , refl)
  difference-surjection (quot m n i) =
    is-prop→pathp
      (λ i → ∥_∥.squash {A = Σ[ (a , b) ∈ Nat × Nat ] (diff a b ≡ quot m n i)})
      (inc ((m , n) , refl))
      (inc ((suc m , suc n) , refl))
      i

What we’ll show is that this surjection actually splits: Given an integer, we can find out what natural numbers it came from. Well, not quite: We can find a reduced representation of that difference. Namely, suppose we’re given the integer $a-b$. We split by cases:

• If $a < b$, then this is the same integer as $0 - (b - a)$;
• If $a > b$, then this is the same integer as $(a - b) - 0$;
• If $a = b$, then this is the same integer as $0 - 0$.

A “canonical form” for an integer is a pair of natural numbers that represent (under diff) the same integer we started with. The canonicalisation procedure does the split we described above, appealing to a battery of three lemmas to prove the equality.

Canonical : Int → Type
Canonical n = Σ[ x ∈ Nat ] Σ[ y ∈ Nat ] (diff x y ≡ n)

canonicalise : (n : Int) → Canonical n
canonicalise = go where
  lemma₁ : ∀ x y → x < y → diff  (y - x) ≡ diff x y
  lemma₂ : ∀ x y → y < x → diff (x - y)  ≡ diff x y
  lemma₃ : ∀ x y → x ≡ y → diff         ≡ diff x y

  work : ∀ x y → Canonical (diff x y)
  work x y with ≤-split x y
  ... | inl p       =      , y - x , lemma₁ x y p
  ... | inr (inl p) = x - y ,      , lemma₂ x y p
  ... | inr (inr p) =      ,      , lemma₃ x y p

It remains to show that the procedure work respects the quotient. This is a truly gargantuan amount of work, and so it’s omitted from this page. You can unfold it below if you dare:

  -- I commend your bravery in unfolding this <details>! These three
  -- lemmas are inductively defined on the natural numbers in a way that
  -- lets us prove that the paths they return respect the Int quotient
  -- without using that Int is a set (because we don't know that yet!)

  lemma₁ zero (suc y) p    = refl
  lemma₁ (suc x) (suc y) p = lemma₁ x y p ∙ Int.quot x y

  lemma₂ (suc x) zero p    = refl
  lemma₂ (suc x) (suc y) p = lemma₂ x y p ∙ Int.quot x y

  lemma₃ zero zero p       = refl
  lemma₃ zero (suc y) p    = absurd (zero≠suc p)
  lemma₃ (suc x) zero p    = absurd (zero≠suc (sym p))
  lemma₃ (suc x) (suc y) p = lemma₃ x y (suc-inj p) ∙ Int.quot x y

  abstract
    work-respects-quot
      : ∀ x y → PathP (λ i → Canonical (Int.quot x y i))
        (work x y)
        (work (suc x) (suc y))
    -- We split on (x, y) but also (1+x,1+y). This is obviously
    -- redundant to a human, but to Agda, we must do this: there is no
    -- link between these two splits.

    -- These first three cases basically mirror the definition of
    -- lemma₁, lemma₂, and lemma₃. They show that
    --    lemma₁₂₃ (suc x) (suc y) p ≡ lemma₁₂₃ (suc x) (suc y) p' ∙ Int.quot x y
    -- but mediating between SquareP, ··, and ∙.
    work-respects-quot x y with ≤-split x y | ≤-split (suc x) (suc y)
    ... | inl x<y | inl x<y' =
      Σ-pathp-dep refl $ Σ-pathp-dep refl $ transport (sym Square≡double-composite-path) $
          double-composite refl _ _
        ·· ∙-id-l _
        ·· ap (λ e → lemma₁ x y e ∙ Int.quot x y) (≤-prop (suc x) y x<y x<y')
    ... | inr (inl x>y) | inr (inl x>y') =
      Σ-pathp-dep refl $ Σ-pathp-dep refl $ transport (sym Square≡double-composite-path) $
          double-composite refl _ _
        ·· ∙-id-l _
        ·· ap (λ e → lemma₂ x y e ∙ Int.quot x y) (≤-prop (suc y) x x>y x>y')
    ... | inr (inr x≡y) | inr (inr x≡y') =
      Σ-pathp-dep refl $ Σ-pathp-dep refl $ transport (sym Square≡double-composite-path) $
          double-composite refl _ _
        ·· ∙-id-l _
        ·· ap (λ e → lemma₃ x y e ∙ Int.quot x y) (Nat-is-set _ _ _ _)

    -- This *barrage* of cases is to handle the cases where e.g. (x < y)
    -- but (1 + x > 1 + y), which is "obviously" impossible. But Agda
    -- doesn't care about what humans think is obvious.
    ... | inl x<y | inr (inl x>y) = absurd (go x y x<y x>y) where
      go : ∀ x y → x < y → y < x → ⊥
      go (suc x) (suc y) p q = go x y p q
    ... | inl x<y | inr (inr x≡y) = absurd (go x y x<y (suc-inj x≡y)) where
      go : ∀ x y → x < y → x ≡ y → ⊥
      go zero (suc y) p q = absurd (zero≠suc q)
      go (suc x) (suc y) p q = go x y p (suc-inj q)
    ... | inr (inl x>y) | inl x<y = absurd (go x y x>y x<y) where
      go : ∀ x y → y < x → x < y → ⊥
      go (suc x) (suc y) p q = go x y p q
    ... | inr (inr x≡y) | inl x<y = absurd (go x y x<y x≡y) where
      go : ∀ x y → x < y → x ≡ y → ⊥
      go zero (suc y) p q = absurd (zero≠suc q)
      go (suc x) (suc y) p q = go x y p (suc-inj q)
    ... | inr (inl x>y) | inr (inr x≡y) = absurd (go x y x>y (suc-inj x≡y)) where
      go : ∀ x y → y < x → x ≡ y → ⊥
      go (suc x) zero p q = absurd (zero≠suc (sym q))
      go (suc x) (suc y) p q = go x y p (suc-inj q)
    ... | inr (inr x≡y) | inr (inl x>y) = absurd (go x y x≡y x>y) where
      go : ∀ x y → x ≡ y → y < x → ⊥
      go (suc x) zero p q = absurd (zero≠suc (sym p))
      go (suc x) (suc y) p q = go x y (suc-inj p) q

  go : ∀ n → Canonical n
  go (diff x y) = work x y
  go (Int.quot x y i) = work-respects-quot x y i

This immediately implies that the type of integers is a set, because it’s a retract of a set — namely $\bb{N} \times \bb{N}$!

instance abstract
  H-Level-Int : ∀ {n} → H-Level Int ( + n)
  H-Level-Int =
    basic-instance  $
      retract→is-hlevel  into from linv (hlevel )
    where
      into : (Nat × Nat) → Int
      into (x , y) = diff x y

      from : Int → Nat × Nat
      from x with canonicalise x
      ... | a , b , p = a , b

      linv : ∀ x → into (from x) ≡ x
      linv x with canonicalise x
      ... | a , b , p = p

Recursion🔗

If we want to define a map $f : \bb{Z} \to X$, it suffices to give a function $f : \bb{N}^2 \to X$ which respects the quotient, in the following sense:

Int-rec : ∀ {ℓ} {X : Type ℓ}
        → (f : Nat → Nat → X)
        → (q : (a b : _) → f a b ≡ f (suc a) (suc b))
        → Int → X
Int-rec f q (diff x y) = f x y
Int-rec f q (quot m n i) = q m n i

However, since $X$ can be a more general space, not necessarily a set, defining a binary operation $f' : \bb{Z}^2 \to X$ can be quite involved! It doesn’t suffice to exhibit a function from $\bb{N}^4$ which respects the quotient separately in each argument:

Int-rec₂ : ∀ {ℓ} {B : Type ℓ}
         → (f : Nat × Nat → Nat × Nat → B)
         → (pl     : (a b x y : _) → f (a , b) (x , y) ≡ f (suc a , suc b) (x , y))
         → (pr     : (a b x y : _) → f (a , b) (x , y) ≡ f (a , b) (suc x , suc y))

In addition, we must have that these two paths pl and pr are coherent. There are two ways of obtaining an equality $f(a, b, x, y) = f(\id{S}a,\id{S}b,\id{S}x,\id{S}y)$ (pl after pr and pr after pl, respectively) and these must be homotopic:

         → (square : (a b x y : _) →
              Square (pl a b x y) (pr a b x y)
                     (pr (suc a) (suc b) x y)
                     (pl a b (suc x) (suc y)))
         → Int → Int → B

The type of square says that we need the following square of paths to commute, which says exactly that pl ∙ pr and pr ∙ pl are homotopic and imposes no further structure on $X$¹:

Int-rec₂ f p-l p-r sq (diff a b) (diff x y)     = f (a , b) (x , y)
Int-rec₂ f p-l p-r sq (diff a b) (quot x y i)   = p-r a b x y i
Int-rec₂ f p-l p-r sq (quot a b i) (diff x y)   = p-l a b x y i
Int-rec₂ f p-l p-r sq (quot a b i) (quot x y j) = sq a b x y i j

However, when the type $X$ we are mapping into is a set, as is the case for the integers themselves, the square is automatically satisfied, so we can give a simplified recursion principle:

Int-rec₂-set :
  ∀ {ℓ} {B : Type ℓ} ⦃ iss-b : H-Level B  ⦄
  → (f : Nat × Nat → Nat × Nat → B)
  → (pl     : (a b x y : _) → f (a , b) (x , y) ≡ f (suc a , suc b) (x , y))
  → (pr     : (a b x y : _) → f (a , b) (x , y) ≡ f (a , b) (suc x , suc y))
  → Int → Int → B
Int-rec₂-set ⦃ iss-b ⦄ f pl pr = Int-rec₂ f pl pr square where abstract
  square
    : (a b x y : Nat)
    → PathP (λ i → pl a b x y i ≡ pl a b (suc x) (suc y) i)
            (pr a b x y) (pr (suc a) (suc b) x y)
  square a b x y = is-set→squarep (λ i j → hlevel ) _ _ _ _

Furthermore, when proving propositions of the integers, the quotient is automatically respected, so it suffices to give the case for diff:

Int-elim-prop : ∀ {ℓ} {P : Int → Type ℓ}
              → ((x : Int) → is-prop (P x))
              → (f : (a b : Nat) → P (diff a b))
              → (x : Int) → P x
Int-elim-prop pprop f (diff a b) = f a b
Int-elim-prop pprop f (quot m n i) =
  is-prop→pathp (λ i → pprop (quot m n i)) (f m n) (f (suc m) (suc n)) i

Int-elim₂-prop : ∀ {ℓ} {P : Int → Int → Type ℓ}
               → ((x y : Int) → is-prop (P x y))
               → (f : (a b x y : Nat) → P (diff a b) (diff x y))
               → (x : Int) (y : Int) → P x y
Int-elim₂-prop pprop f =
  Int-elim-prop (λ x → Π-is-hlevel  (pprop x))
    λ a b int → Int-elim-prop (λ x → pprop (diff a b) x) (f a b) int

Int-elim₃-prop : ∀ {ℓ} {P : Int → Int → Int → Type ℓ}
               → ((x y z : Int) → is-prop (P x y z))
               → (f : (a b c d e f : Nat) → P (diff a b) (diff c d) (diff e f))
               → (x : Int) (y : Int) (z : Int) → P x y z
Int-elim₃-prop pprop f =
  Int-elim₂-prop (λ x y → Π-is-hlevel  (pprop x y))
    λ a b c d int → Int-elim-prop (λ x → pprop (diff a b) (diff c d) x)
                                  (f a b c d)
                                  int

A third possibility for elimination is granted to us by the canonicalisation procedure: By canonicalising and looking at the resulting minuend and subtrahend², we can split on an integer based on its sign:

Int-elim-by-sign
  : ∀ {ℓ} (P : Int → Type ℓ)
  → (pos : ∀ x → P (diff x ))
  → (neg : ∀ x → P (diff  x))
  → P (diff  )
  → ∀ x → P x
Int-elim-by-sign P pos neg zer x with inspect (canonicalise x)
... | (zero  , zero  , p) , q = subst P p zer
... | (zero  , suc b , p) , q = subst P p (neg (suc b))
... | (suc a , zero  , p) , q = subst P p (pos (suc a))
... | (suc a , suc b , p) , q =
  absurd (canonicalise-not-both-suc x (ap fst q) (ap (fst ∘ snd) q))

This procedure is useful, for instance, for computing absolute values:

abs : Int → Nat
abs x with by-sign x
... | posv z = z
... | negv z = suc z

_ : abs -10 ≡ 
_ = refl

Algebra🔗

With these recursion and elimination helpers, it becomes routine to lift the algebraic operations from naturals to integers:

Successors🔗

The simplest “algebraic operation” on an integer is taking its successor. In fact, the integers are characterised by being the free type with an equivalence - that equivalence being “successor”.

sucℤ : Int → Int
sucℤ (diff x y)   = diff (suc x) y
sucℤ (quot m n i) = quot (suc m) n i

predℤ : Int → Int
predℤ (diff x y)   = diff x (suc y)
predℤ (quot m n i) = quot m (suc n) i

The successor of $(a, b)$ is $(1 + a, b)$. Similarly, the predecessor of $(a, b)$ is $(a, 1 + b)$. By the generating equality quot, we have that predecessor and successor are inverses, since applying both (in either order) takes $(a, b)$ to $(1 + a, 1 + b)$.

pred-sucℤ : (x : Int) → predℤ (sucℤ x) ≡ x
pred-sucℤ (diff x y)     = sym (quot x y)
pred-sucℤ (quot m n i) j = quot-diamond m n i (~ j)

suc-predℤ : (x : Int) → sucℤ (predℤ x) ≡ x
suc-predℤ (diff x y)     = sym (quot x y)
suc-predℤ (quot m n i) j = quot-diamond m n i (~ j)

sucℤ-is-equiv : is-equiv sucℤ
sucℤ-is-equiv = is-iso→is-equiv (iso predℤ suc-predℤ pred-sucℤ)

predℤ-is-equiv : is-equiv predℤ
predℤ-is-equiv = is-iso→is-equiv (iso sucℤ pred-sucℤ suc-predℤ)

Addition🔗

_+ℤ_ : Int → Int → Int
diff a b +ℤ diff c d = diff (a + c) (b + d)
diff x y +ℤ quot m n i =
  (quot (x + m) (y + n) ∙ sym (ap₂ diff (+-sucr x m) (+-sucr y n))) i
quot m n i +ℤ diff x y = quot (m + x) (n + y) i
quot m n i +ℤ quot m′ n′ j =
  is-set→squarep (λ i j → hlevel )
    (λ j → quot (m + m′) (n + n′) j)
    (quot (m + m′) (n + n′) ∙ sym (ap₂ diff (+-sucr m m′) (+-sucr n n′)))
    ( quot (suc (m + m′)) (suc (n + n′))
    ∙ sym (ap₂ diff (ap suc (+-sucr m m′)) (ap suc (+-sucr n n′))))
    (λ j → quot (m + suc m′) (n + suc n′) j)
    i j

Since addition of integers is (essentially!) addition of pairs of naturals, the algebraic properties of + on the natural numbers automatically lift to properties about _+ℤ_, using the recursion helpers for props (Int-elim-prop) and the fact that equality of integers is a proposition.

+ℤ-associative : (x y z : Int) → (x +ℤ y) +ℤ z ≡ x +ℤ (y +ℤ z)
+ℤ-zerol       : (x : Int)     →  +ℤ x ≡ x
+ℤ-zeror       : (x : Int)     → x +ℤ  ≡ x
+ℤ-commutative : (x y : Int)   → x +ℤ y ≡ y +ℤ x

abstract
  +ℤ-associative =
    Int-elim₃-prop
      (λ x y z → hlevel )
      (λ a b c d e f → ap₂ diff (+-associative a c e) (+-associative b d f))
  +ℤ-zerol = Int-elim-prop (λ x → hlevel ) (λ a b → refl)
  +ℤ-zeror =
    Int-elim-prop (λ x → hlevel ) (λ a b → ap₂ diff (+-zeror a) (+-zeror b))
  +ℤ-commutative =
    Int-elim₂-prop (λ x y → hlevel )
      (λ a b c d → ap₂ diff (+-commutative a c) (+-commutative b d))

Inverses🔗

Every integer $x$ has an additive inverse, denoted $-x$, which is obtained by swapping the components of the pair. Since the definition of negate is very simple, it can be written conveniently without using Int-rec:

negate : Int → Int
negate (diff x y) = diff y x
negate (quot m n i) = quot n m i

The proof that $-x$ is an additive inverse to $x$ follows, essentially, from commutativity of addition on natural numbers, and the fact that all zeroes are identified.

abstract
  +ℤ-inverser : (x : Int) → x +ℤ negate x ≡ 
  +ℤ-inverser =
    Int-elim-prop (λ _ → hlevel ) λ where
      a b → diff (a + b) ⌜ b + a ⌝ ≡⟨ ap! (+-commutative b a) ⟩≡
            diff (a + b) (a + b)   ≡⟨ sym (zeroes (a + b)) ⟩≡
            diff                 ∎

  +ℤ-inversel : (x : Int) → negate x +ℤ x ≡ 
  +ℤ-inversel =
    Int-elim-prop (λ _ → hlevel ) λ where
      a b → diff ⌜ b + a ⌝ (a + b) ≡⟨ ap! (+-commutative b a) ⟩≡
            diff (a + b) (a + b)   ≡⟨ sym (zeroes (a + b)) ⟩≡
            diff                 ∎

Since negate is precisely what’s missing for Nat to be a group, we can turn the integers into a group. Subtraction is defined as addition with the inverse, rather than directly on diff:

_-ℤ_ : Int → Int → Int
x -ℤ y = x +ℤ negate y

Multiplication🔗

We now prove that the integers are a ring, i.e. that there is a multiplication operation $x*y$ with 1 as a left/right identity, which is associative, and additionally distributes over addition on both the left and the right. It’s also commutative — so $\bb{Z}$ is a commutative ring.

The definition of multiplication is slightly tricky: We use the binomial theorem. Pretend that $xy$ is really $(a-b)(c-d)$, and expand that to $(ac+bd) - (ad+bc)$: that’s our product. It remains to show that this respects the defining equation quot, which involves some nasty equations (you can see them in the types of l₁ and l₂ below) — but this can be done with the semiring solver.

  _*ℤ_ : Int → Int → Int
  diff a b *ℤ diff c d = diff (a * c + b * d) (a * d + b * c)
  diff x y *ℤ quot m n i = rhs₁ x y m n i
  quot m n i *ℤ diff x y = rhs₂ x y m n i
  quot m n i *ℤ quot x y j = is-set→squarep (λ i j → hlevel )
    (rhs₂ x y m n) (rhs₁ m n x y)
    (rhs₁ (suc m) (suc n) x y) (rhs₂ (suc x) (suc y) m n) i j

We omit the proofs of the arithmetic identities below since they are essentially induction + calling the semiring solver.

abstract
  *ℤ-associative : ∀ x y z → (x *ℤ y) *ℤ z ≡ x *ℤ (y *ℤ z)
  *ℤ-commutative : ∀ x y → x *ℤ y ≡ y *ℤ x
  *ℤ-idl : ∀ x →  *ℤ x ≡ x
  *ℤ-idr : ∀ x → x *ℤ  ≡ x
  *ℤ-distrib-+ℤ-l : ∀ x y z → x *ℤ (y +ℤ z) ≡ (x *ℤ y) +ℤ (x *ℤ z)
  *ℤ-distrib-+ℤ-r : ∀ x y z → (y +ℤ z) *ℤ x ≡ (y *ℤ x) +ℤ (z *ℤ x)