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14-InfiniteDescent.agda
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14-InfiniteDescent.agda
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module 14-InfiniteDescent where
{--
Based on
James Brotherston. Sequent Calculus Proof Systems for Inductive Definitions.
PhD thesis, University of Edinburgh, 2006.
http://hdl.handle.net/1842/1458
--}
open import Data.Nat
open import Data.Nat.Properties.Simple
open import Data.Sum as Sum
open import Data.Product as Prod
open import Data.Empty
open import Function
import Function.Related as Related
open import Relation.Nullary
open import Relation.Binary.PropositionalEquality
-- Mathematical induction.
-- Augustus de Morgan (1838).
indℕ : {P : ℕ → Set}
(p0 : P zero) (step : ∀ m → P m → P (suc m))
(n : ℕ) → P n
indℕ p0 step zero =
p0
indℕ p0 step (suc k) =
step k (indℕ p0 step k)
-- Infinite descent.
-- Pierre de Fermat (1659)
descℕ : {P : ℕ → Set}
(¬p0 : P zero → ⊥) (down : ∀ m → P (suc m) → P m)
(n : ℕ) → P n → ⊥
descℕ ¬p0 down zero p0 =
¬p0 p0
descℕ ¬p0 down (suc k) p$1+k =
descℕ ¬p0 down k (down k p$1+k)
-- suc is injective.
suc-inj : ∀ {m n} → suc m ≡ suc n → m ≡ n
suc-inj {m} {.m} refl = refl {x = m}
-- n : ℕ is either `zero` or `suc k`
caseℕ : ∀ n → n ≡ zero ⊎ (∃ λ k → n ≡ suc k)
caseℕ zero = inj₁ refl
caseℕ (suc k) = inj₂ (k , refl)
-- zero ≢ suc n
0≢1+n : ∀ n → zero ≡ suc n → ⊥
0≢1+n n ()
module +-suc-1 where
P : ℕ → Set
P n = n + 0 ≡ n
base : P zero
base = refl
step : ∀ n → P n → P(suc n)
step n n+0≡n = cong suc n+0≡n
+-zero : ∀ n → P n
+-zero = indℕ base step
module +-suc-2 where
+-zero : ∀ n → n + 0 ≡ n
+-zero zero = refl
+-zero (suc k) = cong suc (+-zero k)
module +-suc-3 where
open ≡-Reasoning
+-zero : ∀ n → n + zero ≡ n
+-zero zero =
zero + zero ≡⟨⟩ zero ∎
+-zero (suc k) =
suc k + zero
≡⟨⟩
suc (k + zero)
≡⟨ cong suc (+-zero k) ⟩
suc k ∎
module n≢1+n-v1 where
P : ℕ → Set
P n = n ≡ suc n
¬p0 : P zero → ⊥
¬p0 0≡1+0 = 0≢1+n zero 0≡1+0
step : ∀ n → P (suc n) → P n
step n =
suc n ≡ suc (suc n)
∼⟨ suc-inj ⟩
n ≡ suc n ∎
where open Related.EquationalReasoning
n≢1+n : ∀ n → P n → ⊥
n≢1+n = descℕ ¬p0 step
module n≢1+n-v2 where
n≢1+n : ∀ n → n ≡ suc n → ⊥
n≢1+n zero ()
n≢1+n (suc k) 1+k≡2+k =
n≢1+n k (suc-inj 1+k≡2+k)
module Primℕ where
-- `indℕ` has the same structure as `primℕ`.
primℕ : (base : ℕ) (step : ℕ → ℕ → ℕ) (n : ℕ) → ℕ
primℕ base step zero =
base
primℕ base step (suc k) =
step k (primℕ base step k)
plus : (n m : ℕ) → ℕ
plus n m = primℕ m (const suc) n
+~plus : ∀ n m → n + m ≡ plus n m
+~plus zero m = refl
+~plus (suc k) m = cong suc (+~plus k m)
-- `foldℕ` is a special case of `primℕ`.
foldℕ : (base : ℕ) (step : ℕ → ℕ) (n : ℕ) → ℕ
foldℕ base step zero =
base
foldℕ base step (suc k) =
step (foldℕ base step k)
double : (n : ℕ) → ℕ
double = foldℕ zero (suc ∘ suc)
mutual
data Even : ℕ → Set where
even0 : Even zero
even1 : ∀ {n} → Odd n → Even (suc n)
data Odd : ℕ → Set where
odd1 : ∀ {n} → Even n → Odd (suc n)
odd-1 : Odd 1
odd-1 = odd1 even0
even-2 : Even 2
even-2 = even1 (odd1 even0)
-- Inversion.
¬odd-0 : Odd zero → ⊥
¬odd-0 ()
even-suc : ∀ {n} → Even (suc n) → Odd n
even-suc (even1 odd-n) = odd-n
odd-suc : ∀ {n} → Odd (suc n) → Even n
odd-suc (odd1 even-n) = even-n
module Evn-2*-1 where
-- "Ordinary" induction.
even-2* : ∀ n → Even (n + n)
even-2* zero = even0
even-2* (suc k) = step (even-2* k)
where
open Related.EquationalReasoning renaming (sym to ∼sym)
step : Even (k + k) → Even (suc k + suc k)
step =
Even (k + k)
∼⟨ even1 ∘ odd1 ⟩
Even (suc (suc (k + k)))
≡⟨ cong (Even ∘ suc) (sym $ +-suc k k) ⟩
Even (suc (k + suc k))
≡⟨ refl ⟩
Even (suc k + suc k)
∎
module Odd-2*-1 where
-- "Infinite descent" in style of Fermat.
¬odd-2* : ∀ n → Odd (n + n) → ⊥
¬odd-2* zero odd-0 =
¬odd-0 odd-0
¬odd-2* (suc k) h =
¬odd-2* k (down h)
where
open Related.EquationalReasoning renaming (sym to ∼sym)
down : Odd (suc k + suc k) → Odd (k + k)
down =
Odd (suc k + suc k)
≡⟨ refl ⟩
Odd (suc (k + suc k))
≡⟨ cong (Odd ∘ suc) (+-suc k k) ⟩
Odd (suc (suc (k + k)))
∼⟨ even-suc ∘ odd-suc ⟩
Odd (k + k)
∎
module Odd-2*-2 where
-- A more Agda-idiomatic style...
¬odd-2* : ∀ n → Odd (n + n) → ⊥
¬odd-2* zero ()
¬odd-2* (suc k) (odd1 h)
rewrite +-suc k k
= ¬odd-2* k (even-suc h)
module Even⊎Odd-1 where
even⊎odd : ∀ n → Even n ⊎ Odd n
even⊎odd zero =
inj₁ even0
even⊎odd (suc zero) =
inj₂ (odd1 even0)
even⊎odd (suc (suc k)) =
Sum.map (even1 ∘ odd1) (odd1 ∘ even1) (even⊎odd k)
module Even⊎Odd-2 where
mutual
even⊎odd : ∀ n → Even n ⊎ Odd n
even⊎odd zero =
inj₁ even0
even⊎odd (suc k) =
Sum.map even1 odd1 (odd⊎even k)
odd⊎even : ∀ n → Odd n ⊎ Even n
odd⊎even zero =
inj₂ even0
odd⊎even (suc k) =
Sum.map odd1 even1 (even⊎odd k)
module Even⊎Odd-3 where
even⊎odd : ∀ n → Even n ⊎ Odd n
even⊎odd zero =
inj₁ even0
even⊎odd (suc k) =
([ inj₂ , inj₁ ]′ ∘ Sum.map odd1 even1) (even⊎odd k)
module Even⊎Odd-4 where
even⊎odd : ∀ n → Even n ⊎ Odd n
even⊎odd n =
indℕ {λ n → Even n ⊎ Odd n}
(inj₁ even0) (λ m → [ inj₂ ∘ odd1 , inj₁ ∘ even1 ]′) n
module Even×Odd-1 where
-- "Infinite descent" in style of Fermat.
¬even×odd : ∀ m → Even m × Odd m → ⊥
¬even×odd zero (even-0 , odd-0) =
¬odd-0 odd-0
¬even×odd (suc k) (even-suc-k , odd-suc-k) =
¬even×odd k (odd-suc odd-suc-k , even-suc even-suc-k)
module Even×Odd-2 where
-- A more Agda-idiomatic style...
¬even×odd : ∀ m → Even m → Odd m → ⊥
¬even×odd zero even-0 ()
¬even×odd (suc k) (even1 odd-k) (odd1 even-k) =
¬even×odd k even-k odd-k
-- The R example
data R : (x y : ℕ) → Set where
zy : ∀ {y} → R zero y
xz : ∀ {x} → R x zero
ss : ∀ {x y} → R (suc (suc x)) y → R (suc x) (suc y)
all-r : ∀ x y → R x y
all-r x zero = xz
all-r zero (suc y) = zy
all-r (suc x) (suc y) =
ss (all-r (suc (suc x)) y)
-- The P & Q example
mutual
data P : (x : ℕ) → Set where
pz : P zero
ps : ∀ {x} → P x → Q x (suc x) → P (suc x)
data Q : (x y : ℕ) → Set where
qz : ∀ {x} → Q x zero
qs : ∀ {x y} → P x → Q x y → Q x (suc y)
mutual
all-q : ∀ x y → Q x y
all-q x zero = qz
all-q x (suc y) =
qs (all-p x) (all-q x y)
all-p : ∀ x → P x
all-p zero = pz
all-p (suc x) =
ps (all-p x) (all-q x (suc x))
-- The N′ example
data N′ : (x y : ℕ) → Set where
nz : ∀ {y} → N′ zero y
ns : ∀ {x y} → N′ y x → N′ (suc x) y
mutual
all-n : ∀ x y → N′ x y
all-n zero y = nz
all-n (suc x) y = ns (all-n y x)
-- The "problem" with Agda is that it is a statically-typed language,
-- while Brotherston deals with an untyped language.
-- Thus some examples are too easy to reproduce in Agda.
-- Hence, let us define natural numbers in "unnatural" way,
-- in order that they be a subset of an Agda type.
open import Data.Bool
open import Data.List
data BN : (bs : List Bool) → Set where
zero : BN []
suc : ∀ {bs} → BN bs → BN (true ∷ bs)
bn3 : BN (true ∷ true ∷ true ∷ [])
bn3 = suc (suc (suc zero))
mutual
data BE : (bs : List Bool) → Set where
be0 : BE []
be1 : ∀ {bs} → BO bs → BE (true ∷ bs)
data BO : (bs : List Bool) → Set where
bo1 : ∀ {bs} → BE bs → BO (true ∷ bs)
be2 : BE (true ∷ true ∷ [])
be2 = be1 (bo1 be0)
bo3 : BO (true ∷ true ∷ true ∷ [])
bo3 = bo1 (be1 (bo1 be0))
module BE⊎BO-1 where
be⊎bo : ∀ {n} (bn : BN n) → BE n ⊎ BO n
be⊎bo zero = inj₁ be0
be⊎bo (suc zero) = inj₂ (bo1 be0)
be⊎bo (suc (suc bn)) =
Sum.map (be1 ∘ bo1) (bo1 ∘ be1) (be⊎bo bn)
module BE⊎BO-2 where
mutual
be⊎bo : ∀ {n} (bn : BN n) → BE n ⊎ BO n
be⊎bo zero = inj₁ be0
be⊎bo (suc bn) =
Sum.map be1 bo1 (bo⊎be bn)
bo⊎be : ∀ {n} (bn : BN n) → BO n ⊎ BE n
bo⊎be zero = inj₂ be0
bo⊎be (suc bn) =
Sum.map bo1 be1 (be⊎bo bn)
module BE⊎BO-3 where
be⊎bo : ∀ {n} (bn : BN n) → BE n ⊎ BO n
be⊎bo zero = inj₁ be0
be⊎bo (suc bn) =
[ inj₂ , inj₁ ]′ (Sum.map bo1 be1 (be⊎bo bn))
module BE⊎BO-BN-1 where
be-bn : ∀ {n} (be : BE n) → BN n
be-bn be0 = zero
be-bn (be1 (bo1 be)) = suc (suc (be-bn be))
be⊎bo-bn : ∀ {n} (beo : BE n ⊎ BO n) → BN n
be⊎bo-bn (inj₁ be) = be-bn be
be⊎bo-bn (inj₂ (bo1 be)) = suc (be-bn be)
module BE⊎BO-BN-2 where
mutual
be-bn : ∀ {n} (be : BE n) → BN n
be-bn be0 = zero
be-bn (be1 bo) = suc (bo-bn bo)
bo-bn : ∀ {n} (bo : BO n) → BN n
bo-bn (bo1 be) = suc (be-bn be)
be⊎bo-bn : ∀ {n} (beo : BE n ⊎ BO n) → BN n
be⊎bo-bn = [ be-bn , bo-bn ]′
-- Complete induction
data Acc<′ (n : ℕ) : Set where
acc : (rs : ∀ m → m <′ n → Acc<′ m) → Acc<′ n
mutual
<′-acc : ∀ n m → m <′ n → Acc<′ m
<′-acc .(suc m) m ≤′-refl = all-acc<′ m
<′-acc .(suc n) m (≤′-step {n} m<′n) = <′-acc n m m<′n
all-acc<′ : ∀ n → Acc<′ n
all-acc<′ n = acc (<′-acc n)
ind<′-acc : ∀ {P : ℕ → Set}
(step : ∀ n → (∀ m → m <′ n → P m) → P n) →
∀ n → Acc<′ n → P n
ind<′-acc step n (acc rs) =
step n (λ m m<′n → ind<′-acc step m (rs m m<′n))
ind<′ : ∀ {P : ℕ → Set}
(step : ∀ n → (∀ m → m <′ n → P m) → P n) →
∀ n → P n
ind<′ step n =
ind<′-acc step n (all-acc<′ n)