-- We begin by adding some primitive bindings using the PRIMITIVE pragma.
-- 
-- It goes like this: PRIMITIVE primName varName.
-- 
-- If the varName is dropped, then it's taken to be the same as primName.
-- 
-- If there is a previous declaration for the varName, then the type
-- is checked against the internally-known "proper" type for the primitive.

-- Universe of fibrant types
{-# PRIMITIVE Type #-}

-- Universe of non-fibrant types
{-# PRIMITIVE Pretype #-}

-- Fibrant is a fancy word for "has a composition structure". Most types
-- we inherit from MLTT are fibrant:
-- 
-- Stuff like products Π, sums Σ, naturals, booleans, lists, etc., all
-- have composition structures.
-- 
-- The non-fibrant types are part of the structure of cubical
-- categories: The interval, partial elements, cubical subtypes, ...

-- The interval
---------------

-- The interval has two endpoints i0 and i1.
-- These form a de Morgan algebra.
I : Pretype
{-# PRIMITIVE Interval I #-}

i0, i1 : I
{-# PRIMITIVE i0 #-}
{-# PRIMITIVE i1 #-}

-- "minimum" on the interval
iand : I -> I -> I
{-# PRIMITIVE iand #-}

-- "maximum" on the interval.
ior : I -> I -> I
{-# PRIMITIVE ior #-}

-- The interpretation of iand as min and ior as max justifies the fact that
-- ior i (inot i) != i1, since that equality only holds for the endpoints.

-- inot i = 1 - i is a de Morgan involution.
inot : I -> I
{-# PRIMITIVE inot #-}

-- Paths
--------

-- Since every function in type theory is internally continuous,
-- and the two endpoints i0 and i1 are equal, we can take the type of
-- equalities to be continuous functions out of the interval.
-- That is, x ≡ y iff. ∃ f : I -> A, f i0 = x, f i1 = y.

-- The type PathP generalises this to dependent products (i : I) -> A i.

PathP : (A : I -> Type) -> A i0 -> A i1 -> Type
{-# PRIMITIVE PathP #-}

-- By taking the first argument to be constant we get the equality type
-- Path.

Path : {A : Type} -> A -> A -> Type
Path {A} = PathP (\i -> A)

-- reflexivity is given by constant paths

refl : {A : Type} {x : A} -> Path x x
refl {A} {x} i = x

-- Symmetry (for dpeendent paths) is given by inverting the argument to the path, such that
--   sym p i0 = p (inot i0) = p i1
--   sym p i1 = p (inot i1) = p i0
-- This has the correct endpoints.

sym : {A : I -> Type} {x : A i0} {y : A i1} -> PathP A x y -> PathP (\i -> A (inot i)) y x
sym p i = p (inot i)

id : {A : Type} -> A -> A
id x = x

the : (A : Type) -> A -> A
the A x = x

-- The eliminator for the interval says that if you have x : A i0 and y : A i1,
-- and x ≡ y, then you can get a proof A i for every element of the interval.
iElim : {A : I -> Type} {x : A i0} {y : A i1} -> PathP A x y -> (i : I) -> A i
iElim p i = p i

-- This corresponds to the elimination principle for the HIT
--   data I : Pretype where
--     i0 i1 : I
--     seg   : i0 ≡ i1

-- The singleton subtype of A at x is the type of elements of y which
-- are equal to x.
Singl : (A : Type) -> A -> Type
Singl A x = (y : A) * Path x y

-- Contractible types are those for which there exists an element to which
-- all others are equal.
isContr : Type -> Type
isContr A = (x : A) * ((y : A) -> Path x y)

-- Using the connection \i j -> y.2 (iand i j), we can prove that
-- singletons are contracible. Together with transport later on,
-- we get the J elimination principle of paths.
singContr : {A : Type} {a : A} -> isContr (Singl A a)
singContr {A} {a} = ((a, \i -> a), \y i -> (y.2 i, \j -> y.2 (iand i j)))

-- Some more operations on paths. By rearranging parentheses we get a
-- proof that the images of equal elements are themselves equal.
cong : {A : Type} {B : A -> Type} (f : (x : A) -> B x) {x : A} {y : A} (p : Path x y) -> PathP (\i -> B (p i)) (f x) (f y)
cong f p i = f (p i)

-- These satisfy definitional equalities, like congComp and congId, which are
-- propositional in vanilla MLTT.
congComp : {A : Type} {B : Type} {C : Type}
           {f : A -> B} {g : B -> C} {x : A} {y : A}
           (p : Path x y)
        -> Path (cong g (cong f p)) (cong (\x -> g (f x)) p)
congComp p = refl

congId : {A : Type} {x : A} {y : A}
         (p : Path x y)
     -> Path (cong (id {A}) p) p
congId p = refl

-- Just like rearranging parentheses gives us cong, swapping the value
-- and interval binders gives us function extensionality.
funext : {A : Type} {B : A -> Type} {f : (x : A) -> B x} {g : (x : A) -> B x}
         (h : (x : A) -> Path (f x) (g x))
      -> Path f g
funext h i x = h x i

-- The proposition associated with an element of the interval
-------------------------------------------------------------

-- Associated with every element i : I of the interval, we have the type
-- IsOne i which is inhabited only when i = i1. In the model, this
-- corresponds to the map [φ] from the interval cubical set to the
-- subobject classifier.

IsOne : I -> Pretype
{-# PRIMITIVE IsOne #-}

-- The value itIs1 witnesses the fact that i1 = i1.
itIs1 : IsOne i1

{-# PRIMITIVE itIs1 #-}

-- Partial elements
-------------------
--
-- Since a function I -> A has two endpoints, and a function I -> I -> A
-- has four endpoints + four functions I -> A as "sides" (obtained by
-- varying argument while holding the other as a bound variable), we
-- refer to elements of I^n -> A as "cubes".

-- This justifies the existence of partial elements, which are, as the
-- name implies, partial cubes. Namely, a Partial φ A is an element of A
-- which depends on a proof that IsOne φ.

Partial : I -> Type -> Pretype
{-# PRIMITIVE Partial #-}

-- There is also a dependent version where the type A is itself a
-- partial element.

PartialP : (phi : I) -> Partial phi Type -> Pretype
{-# PRIMITIVE PartialP #-}

-- Why is Partial φ A not just defined as φ -> A? The difference is that
-- Partial φ A has an internal representation which definitionally relates
-- any two partial elements which "agree everywhere", that is, have
-- equivalent values for every possible assignment of variables which
-- makes IsOne φ hold.

-- Cubical Subtypes
--------------------

-- Given A : Type, phi : I, and a partial element u : A defined on φ,
-- we have the type Sub A phi u, notated A[phi -> u] in the output of
-- the type checker, whose elements are "extensions" of u.

-- That is, element of A[phi -> u] is an element of A defined everywhere
-- (a total element), which, when IsOne φ, agrees with u.

Sub  : (A : Type) (phi : I) -> Partial phi A -> Pretype
{-# PRIMITIVE Sub #-}

-- Every total element u : A can be made partial on φ by ignoring the
-- constraint. Furthermore, this "totally partial" element agrees with
-- the original total element on φ.
inS : {A : Type} {phi : I} (u : A) -> Sub A phi (\x -> u)
{-# PRIMITIVE inS #-}

-- When IsOne φ, outS {A} {φ} {u} x reduces to u itIs1.
-- This implements the fact that x agrees with u on φ.
outS : {A : Type} {phi : I} {u : Partial phi A} -> Sub A phi u -> A
{-# PRIMITIVE outS #-}

-- The composition operation
----------------------------

-- Now that we have syntax for specifying partial cubes,
-- and specifying that an element agrees with a partial cube,
-- we can describe the composition operation.

comp : (A : I -> Type) {phi : I} (u : (i : I) -> Partial phi (A i)) -> Sub (A i0) phi (u i0) -> A i1
{-# PRIMITIVE comp #-}

-- In particular, when φ is a disjunction of the form
-- (j = 0) || (j = 1), we can draw u as being a pair of lines forming a
-- "tube", an open square with no floor or roof:
--
-- Given u = \j [ (i = i0) -> x, (i = i1) -> q j] on the extent i || ~i,
-- we draw:
--
--          x         q i1
--          |          |
-- \j -> x  |          | \j -> q j
--          |          |
--          x         q i0
--
-- The composition operation says that, as long as we can provide a
-- "floor" connecting x -- q i0, as a total element of A which, on
-- phi, extends u i0, then we get the "roof" connecting x and q i1
-- for free.
--
-- If we have a path p : x ≡ y, and q : y ≡ z, then we do get the
-- "floor", and composition gets us the dotted line:
-- 
--        x..........z
--        |          |
--     x  |          | q j
--        |          |
--        x----------y
--             p i

trans : {A : Type} {x : A} {y : A} {z : A} -> PathP (\i -> A) x y -> PathP (\i -> A) y z -> PathP (\i -> A) x z
trans {A} {x} p q i =
  comp (\i -> A)
    {ior i (inot i)}
    (\j [ (i = i0) -> x, (i = i1) -> q j ])
    (inS (p i))

-- In particular when the formula φ = i0 we get the "opposite face" to a
-- single point, which corresponds to transport.

transp : (A : I -> Type) (x : A i0) -> A i1
transp A x = comp A {i0} (\i [ ]) (inS x)

-- Since we have the iand operator, we can also derive the *filler* of a cube,
-- which connects the given face and the output of composition.

fill : (A : I -> Type) {phi : I} (u : (i : I) -> Partial phi (A i)) -> Sub (A i0) phi (u i0) -> (i : I) -> A i
fill A {phi} u a0 i =
    comp (\j -> A (iand i j))
         {ior phi (inot i)}
         (\j [ (phi = i1) as p -> u (iand i j) p, (i = i0) -> outS a0 ])
         (inS (outS a0))

hfill : {A : Type} {phi : I} (u : (i : I) -> Partial phi A) -> Sub A phi (u i0) -> I -> A
hfill {A} {phi} u a0 i = fill (\i -> A) {phi} u a0 i

hcomp : {A : Type} {phi : I} (u : (i : I) -> Partial phi A) -> Sub A phi (u i0) -> A
hcomp {A} {phi} u a0 = comp (\i -> A) {phi} u a0

-- For instance, the filler of the previous composition square
-- tells us that trans p refl = p:

transRefl : {A : Type} {x : A} {y : A} (p : Path x y) -> Path (trans p refl) p
transRefl p j i = fill (\i -> A) {ior i (inot i)} (\k [ (i = i0) -> x, (i = i1) -> y ]) (inS (p i)) (inot j)

-- Reduction of composition
---------------------------
--
-- Composition reduces on the structure of the family A : I -> Type to create
-- the element a1 : (A i1)[phi -> u i1].
--
-- For instance, when filling a cube of functions, the behaviour is to
-- first transport backwards along the domain, apply the function, then
-- forwards along the codomain.

transpFun : {A : Type} {B : Type} {C : Type} {D : Type} (p : Path A B) (q : Path C D)
         -> (f : A -> C) -> Path (transp (\i -> p i -> q i) f)
                                 (\x -> transp (\i -> q i) (f (transp (\i -> p (inot i)) x)))
transpFun p q f = refl

-- When considering the more general case of a composition respecing sides,
-- the outer transport becomes a composition.

-- Glueing and Univalence
-------------------------

-- First, let's get some definitions out of the way.
--
-- The *fiber* of a function f : A -> B at a point y : B is the type of
-- inputs x : A which f takes to y, that is, for which there exists a
-- path f(x) = y.

fiber : {A : Type} {B : Type} -> (A -> B) -> B -> Type
fiber f y = (x : A) * Path (f x) y

-- An *equivalence* is a function where every fiber is contractible.
-- That is, for every point in the codomain y : B, there is exactly one
-- point in the input which f maps to y.

isEquiv : {A : Type} {B : Type} -> (A -> B) -> Type
isEquiv {A} {B} f = (y : B) -> isContr (fiber {A} {B} f y)

-- By extracting this point, which must exist because the fiber is contractible,
-- we can get an inverse of f:

inverse : {A : Type} {B : Type} {f : A -> B} -> isEquiv f -> B -> A
inverse eqv y = (eqv y) .1 .1

-- We can prove that «inverse eqv» is a section of f:

section : {A : Type} {B : Type} (f : A -> B) (eqv : isEquiv f) -> Path (\x -> f (inverse eqv x)) id
section f eqv i y = (eqv y) .1 .2 i

-- Proving that it's also a retraction is left as an exercise to the
-- reader. We can package together a function and a proof that it's an
-- equivalence to get a capital-E Equivalence.

Equiv : (A : Type) (B : Type) -> Type
Equiv A B = (f : A -> B) * isEquiv {A} {B} f

-- The identity function is an equivalence between any type A and
-- itself.
idEquiv : {A : Type} -> isEquiv (id {A})
idEquiv y = ((y, \i -> y), \u i -> (u.2 (inot i), \j -> u.2 (ior (inot i) j)))

-- The glue operation expresses that "extensibility is invariant under
-- equivalence". Less concisely, the Glue type and its constructor,
-- glue, let us extend a partial element of a partial type to a total
-- element of a total type, by "gluing" the partial type T using a
-- partial equivalence e onto a total type A.

-- In particular, we have that when φ = i1, Glue A [i1 -> (T, f)] = T.

primGlue : (A : Type) {phi : I}
           (T : Partial phi Type)
           (e : PartialP phi (\o -> Equiv (T o) A))
        -> Type
{-# PRIMITIVE Glue primGlue #-}

-- The glue constructor extends the partial element t : T to a total
-- element of Glue A [φ -> (T, e)] as long as we have a total im : A
-- which is the image of f(t).
--
-- Agreeing with the condition that Glue A [i1 -> (T, e)] = T,
-- we have that glue {A} {i1} t im => t.
prim'glue : {A : Type} {phi : I} {T : Partial phi Type} {e : PartialP phi (\o -> Equiv (T o) A)}
         -> (t  : PartialP phi T)
         -> (im : Sub A phi (\o -> (e o).1 (t o)))
         -> primGlue A T e

{-# PRIMITIVE glue prim'glue #-}

-- The unglue operation undoes a glueing. Since when φ = i1,
-- Glue A [φ -> (T, f)] = T, the argument to primUnglue {A} {i1} ...
-- will have type T, and so to get back an A we need to apply the
-- partial equivalence f (defined everywhere).

primUnglue : {A : Type} {phi : I} {T : Partial phi Type} {e : PartialP phi (\o -> Equiv (T o) A)}
          -> primGlue A {phi} T e -> A

{-# PRIMITIVE unglue primUnglue #-}

-- Diagramatically, i : I |- Glue A [(i \/ ~i) -> (T, e)] can be drawn
-- as giving us the dotted line in:
--
--       T i0 ......... T i1
--        |              |
--        |              |
--   e i0 |~            ~| e i1
--        |              |
--        |              |
--       A i0 --------- A i1
--                A
--
-- Where the the two "e" sides are equivalences, and the bottom side is
-- the line i : I |- A.
--
-- Thus, by choosing a base type, a set of partial types and partial
-- equivalences, we can make a line between two types (T i0) and (T i1).

Glue : (A : Type) {phi : I} -> Partial phi ((X : Type) * Equiv X A) -> Type
Glue A {phi} u = primGlue A {phi} (\o -> (u o).1) (\o -> (u o).2)

-- For example, we can glue together the type A and the type B as long
-- as there exists an Equiv A B.
--
--        A ............ B
--        |              |
--        |              |
--  equiv |~  ua equiv  ~| idEquiv {B}
--        |              |
--        |              |
--        B ------------ B
--             \i → B
--
univalence : {A : Type} {B : Type} -> Equiv A B -> Path A B
univalence {A} {B} equiv i =
  Glue B (\[ (i = i0) -> (A, equiv),
             (i = i1) -> (B, the B, idEquiv {B}) ]) 


-- The fact that this diagram has 2 filled-in B sides explains the
-- complication in the proof below.
--
-- In particular, the actual behaviour of transp (\i -> univalence f i)
-- (x : A) is not just to apply f x to get a B (the left side), it also
-- needs to:
--
--   * For the bottom side, compose along (\i -> B) (the bottom side)
--   * For the right side, apply the inverse of the identity, which
--     is just identity, to get *some* b : B
-- 
-- But that b : B might not agree with the sides of the composition
-- operation in a more general case, so it composes along (\i -> B)
-- *again*!
--
-- Thus the proof: a simple cubical argument suffices, since
-- for any composition, its filler connects either endpoints. So
-- we need to come up with a filler for the bottom and right faces.

univalenceBeta : {A : Type} {B : Type} (f : Equiv A B) -> Path (transp (\i -> univalence f i)) f.1
univalenceBeta {A} {B} f i a =
  let
    -- The bottom left corner
    botLeft : B
    botLeft = transp (\i -> B) (f.1 a)

    -- The "bottom face" filler connects the bottom-left corner, f.1 a,
    -- and the bottom-right corner, which is the transport of f.1 a
    -- along \i -> B.
    botFace : Path (f.1 a) botLeft
    botFace i = fill (\i -> B) (\j []) (inS (f.1 a)) i

    -- The "right face" filler connects the bottom-right corner and the
    -- upper-right corner, which is again a simple transport along
    -- \i -> B.
    rightFace : Path (transp (\i -> B) botLeft) botLeft
    rightFace i = fill (\i -> B) (\j []) (inS botLeft) (inot i)

    -- The goal is a path between the bottom-left and top-right corners,
    -- which we can get by composing (in the path sense) the bottom and
    -- right faces.
    goal : Path (transp (\i -> B) botLeft) (f.1 a)
    goal = trans rightFace (\i -> botFace (inot i))
  in goal i

-- The terms univalence + univalenceBeta suffice to prove the "full"
-- univalence axiom of Voevodsky, as can be seen in the paper
--
--   Ian Orton, & Andrew M. Pitts. (2017). Decomposing the Univalence Axiom.
--
-- Available freely here: https://arxiv.org/abs/1712.04890v3

J : {A : Type} {x : A}
    (P : (y : A) -> Path x y -> Type)
    (d : P x (\i -> x))
    {y : A} (p : Path x y)
 -> P y p
J P d p = transp (\i -> P (p i) (\j -> p (iand i j))) d


-- Isomorphisms
---------------
--
-- Since isomorphisms are a much more convenient notion of equivalence
-- than contractible fibers, it's natural to ask why the CCHM paper, and
-- this implementation following that, decided on the latter for our
-- definition of equivalence.

isIso : {A : Type} -> {B : Type} -> (A -> B) -> Type
isIso {A} {B} f = (g : B -> A) * ((y : B) -> Path (f (g y)) y) * ((x : A) -> Path (g (f x)) x)

-- The reason is that the family of types IsIso is not a proposition!
-- This means that there can be more than one way for a function to be
-- an equivalence. This is Lemma 4.1.1 of the HoTT book.

Iso : Type -> Type -> Type
Iso A B = (f : A -> B) * isIso f

-- Nevertheless, we can prove that any function with an isomorphism
-- structure has contractible fibers, using a cubical argument adapted
-- from CCHM's implementation of cubical type theory:
--
-- https://github.com/mortberg/cubicaltt/blob/master/experiments/isoToEquiv.ctt#L7-L55

IsoToEquiv : {A : Type} {B : Type} -> Iso A B -> Equiv A B
IsoToEquiv {A} {B} iso = (f, \y -> (fCenter y, fIsCenter y)) where
  f = iso.1
  g = iso.2.1
  s = iso.2.2.1
  t = iso.2.2.2

  lemIso : (y : B) (x0 : A) (x1 : A) (p0 : Path (f x0) y) (p1 : Path (f x1) y)
        -> PathP (\i -> fiber f y) (x0, p0) (x1, p1)
  lemIso y x0 x1 p0 p1 =
    let
      rem0 : Path x0 (g y)
      rem0 i = comp (\i -> A) (\k [ (i = i0) -> t x0 k, (i = i1) -> g y ]) (inS (g (p0 i)))

      rem1 : Path x1 (g y)
      rem1 i = comp (\i -> A) (\k [ (i = i0) -> t x1 k, (i = i1) -> g y ]) (inS (g (p1 i)))

      p : Path x0 x1
      p i = comp (\i -> A) (\k [ (i = i0) -> rem0 (inot k), (i = i1) -> rem1 (inot k) ]) (inS (g y))

      fill0 : I -> I -> A
      fill0 i j = comp (\i -> A) (\k [ (i = i0) -> t x0 (iand j k)
                                      , (i = i1) -> g y
                                      , (j = i0) -> g (p0 i) 
                                      ])
                            (inS (g (p0 i)))

      fill1 : I -> I -> A
      fill1 i j = comp (\i -> A) (\k [ (i = i0) -> t x1 (iand j k)
                                      , (i = i1) -> g y
                                      , (j = i0) -> g (p1 i) ])
                            (inS (g (p1 i)))

      fill2 : I -> I -> A
      fill2 i j = comp (\i -> A) (\k [ (i = i0) -> rem0 (ior j (inot k))
                                      , (i = i1) -> rem1 (ior j (inot k))
                                      , (j = i1) -> g y ])
                            (inS (g y))

      sq : I -> I -> A
      sq i j = comp (\i -> A) (\k [ (i = i0) -> fill0 j (inot k)
                                  , (i = i1) -> fill1 j (inot k)
                                  , (j = i1) -> g y
                                  , (j = i0) -> t (p i) (inot k) ])
                          (inS (fill2 i j))

      sq1 : I -> I -> B
      sq1 i j = comp (\i -> B) (\k [ (i = i0) -> s (p0 j) k
                              , (i = i1) -> s (p1 j) k
                              , (j = i0) -> s (f (p i)) k
                              , (j = i1) -> s y k
                              ])
                          (inS (f (sq i j)))
    in \i -> (p i, \j -> sq1 i j)

  fCenter : (y : B) -> fiber f y
  fCenter y = (g y, s y)

  fIsCenter : (y : B) (w : fiber f y) -> Path (fCenter y) w
  fIsCenter y w = lemIso y (fCenter y).1 w.1 (fCenter y).2 w.2

-- We can prove that any involutive function is an isomorphism, since
-- such a function is its own inverse.

involToIso : {A : Type} (f : A -> A) -> ((x : A) -> Path (f (f x)) x) -> isIso f
involToIso {A} f inv = (f, inv, inv)

-- An example of univalence
---------------------------
--
-- The classic example of univalence is the equivalence
-- not : Bool \simeq Bool.
--
-- We define it here.

data Bool : Type where
  true : Bool
  false : Bool

not : Bool -> Bool
not = \case
  true -> false
  false -> true

elimBool : (P : Bool -> Type) -> P true -> P false -> (b : Bool) -> P b
elimBool P x y = \case
  true -> x
  false -> y

if : {A : Type} -> A -> A -> Bool -> A
if x y = \case
  true -> x
  false -> y

-- By pattern matching it suffices to prove (not (not true)) ≡ true and
-- not (not false) ≡ false. Since not (not true) computes to true (resp.
-- false), both proofs go through by refl.
notInvol : (x : Bool) -> Path (not (not x)) x
notInvol = elimBool (\b -> Path (not (not b)) b) refl refl

notp : Path Bool Bool
notp = univalence (IsoToEquiv (not, involToIso not notInvol))

-- This path actually serves to prove a simple lemma about the universes
-- of HoTT, namely, that any univalent universe is not a 0-type. If we
-- had HITs, we could prove that this fact holds for any n, but for now,
-- proving it's not an h-set is the furthest we can go.

-- First we define what it means for something to be false. In type theory,
-- we take ¬P = P → ⊥, where the bottom type is the only type satisfying
-- the elimination principle
--
--    elimBottom : (P : bottom -> Type) -> (b : bottom) -> P b
--
-- This follows from setting bottom := ∀ A, A.

bottom : Type
bottom = {A : Type} -> A

elimBottom : (P : bottom -> Type) -> (b : bottom) -> P b
elimBottom P x = x

-- We prove that true != false by transporting along the path
--
--                    \i -> if (Bool -> Bool) A (p i)
--   (Bool -> Bool) ------------------------------------ A
--
-- To verify that this has the correct endpoints, check out the endpoints
-- for p:
--
--             true ------------------------------------ false
--
-- and evaluate the if at either end.

trueNotFalse : Path true false -> bottom
trueNotFalse p {A} = transp (\i -> if (Bool -> Bool) A (p i)) id

-- To be an h-Set is to have no "higher path information". Alternatively,
--
-- isHSet A = (x : A) (y : A) -> isHProp (Path x y)
--
isHSet : Type -> Type
isHSet A = {x : A} {y : A} (p : Path x y) (q : Path x y) -> Path p q

-- We can prove *a* contradiction (note: this is a direct proof!) by adversarially
-- choosing two paths p, q that we know are not equal. Since "equal" paths have
-- equal behaviour when transporting, we can choose two paths p, q and a point x
-- such that transporting x along p gives a different result from x along q.
--
-- Since transp notp = not but transp refl = id, that's what we go with. The choice
-- of false as the point x is just from the endpoints of trueNotFalse.

universeNotSet : isHSet Type -> bottom
universeNotSet itIs = trueNotFalse (\i -> transp (\j -> itIs notp refl i j) false)

-- Funext is an inverse of happly
---------------------------------
--
-- Above we proved function extensionality, namely, that functions
-- pointwise equal everywhere are themselves equal.
-- However, this formulation of the axiom is known as "weak" function
-- extensionality. The strong version is as follows:

Hom : {A : Type} {B : A -> Type} (f : (x : A) -> B x) -> (g : (x : A) -> B x) -> Type
Hom {A} f g = (x : A) -> Path (f x) (g x)

happly : {A : Type} {B : A -> Type} {f : (x : A) -> B x} {g : (x : A) -> B x}
      -> (p : Path f g) -> Hom f g
happly p x i = p i x

-- Strong function extensionality: happly is an equivalence.

happlyIsIso : {A : Type} {B : A -> Type} {f : (x : A) -> B x} {g : (x : A) -> B x}
           -> isIso {Path f g} {Hom f g} happly
happlyIsIso {A} {B} {f} {g} = (funext {A} {B} {f} {g}, \hom -> refl, \path -> refl)

pathIsHom : {A : Type} {B : A -> Type} {f : (x : A) -> B x} {g : (x : A) -> B x}
         -> Path (Path f g) (Hom f g)
pathIsHom {A} {B} {f} {g} =
  let
    theIso : Iso (Path f g) (Hom f g)
    theIso = (happly {A} {B} {f} {g}, happlyIsIso {A} {B} {f} {g})
  in univalence (IsoToEquiv theIso)

-- Inductive types
-------------------
--
-- An inductive type is a type freely generated by a finite set of
-- constructors. For instance, the type of natural numbers is generated
-- by the constructors for "zero" and "successor".

data Nat : Type where
  zero : Nat
  succ : Nat -> Nat

-- Pattern matching allows us to prove that these initial types are
-- initial algebras for their corresponding functors.

Nat_elim : (P : Nat -> Type) -> P zero -> ((x : Nat) -> P x -> P (succ x)) -> (x : Nat) -> P x
Nat_elim P pz ps = \case
  zero -> pz
  succ x -> ps x (Nat_elim P pz ps x)

-- The type of integers can be defined as A + B, where "pos n" means +n
-- and "neg n" means -(n + 1).

data Int : Type where
  pos : Nat -> Int
  neg : Nat -> Int

-- On this representation we can define the successor and predecessor
-- functions by (nested) induction.

sucZ : Int -> Int
sucZ = \case
  pos n -> pos (succ n)
  neg n ->
    let suc_neg : Nat -> Int
        suc_neg = \case
          zero -> pos zero
          succ n -> neg n
     in suc_neg n

predZ : Int -> Int
predZ = \case
  pos n ->
    let pred_pos : Nat -> Int
        pred_pos = \case
          zero -> neg zero
          succ n -> pos n
     in pred_pos n
  neg n -> neg (succ n)

-- And prove that the successor function is an isomorphism, and thus, an
-- equivalence.

sucEquiv : isIso sucZ
sucEquiv = 
  let
    sucPredZ : (x : Int) -> Path (sucZ (predZ x)) x
    sucPredZ = \case
      pos n ->
        let k : (n : Nat) -> Path (sucZ (predZ (pos n))) (pos n)
            k = \case
              zero -> refl
              succ n -> refl
         in k n
      neg n -> refl
    predSucZ : (x : Int) -> Path (predZ (sucZ x)) x
    predSucZ = \case
      pos n -> refl
      neg n ->
        let k : (n : Nat) -> Path (predZ (sucZ (neg n))) (neg n)
            k = \case
              zero -> refl
              succ n -> refl
         in k n
   in (predZ, sucPredZ, predSucZ)

-- Univalence gives us a path between integers such that transp intPath
-- x = suc x, transp (sym intPath) x = pred x

intPath : Path Int Int
intPath = univalence (IsoToEquiv (sucZ, sucEquiv))

-- Higher inductive types
-------------------------
--
-- While inductive types let us generate discrete spaces like the
-- naturals or integers, they do not support defining higher-dimensional
-- structures given by spaces with points and paths.

-- A very simple higher inductive type is the interval, given by

data Interval : Type where
  ii0 : Interval
  ii1 : Interval
  seg i : Interval [ (i = i0) -> ii0, (i = i1) -> ii1 ]

-- This expresses that we have two points ii0 and ii1 and a path (\i ->
-- seg i) with endpoints ii0 and ii1.

-- With this type we can reproduce the proof of Lemma 6.3.2 from the
-- HoTT book:

iFunext : {A : Type} {B : A -> Type} (f : (x : A) -> B x) (g : (x : A) -> B x) -> ((x : A) -> Path (f x) (g x)) -> Path f g
iFunext f g p i = h' (seg i) where
  h : (x : A) -> Interval -> B x
  h x = \case
    ii0 -> f x
    ii1 -> g x
    seg i -> p x i

  h' : Interval -> (x : A) -> B x
  h' i x = h x i 

-- Of course, Cubical Type Theory also has an interval (pre)type, but
-- that, unlike the Interval here, is not Kan: it has no composition
-- structure.

-- Another simple higher-inductive type is the circle, with a point and
-- a non-trivial loop, (\i -> loop i).

data S1 : Type where
  base : S1
  loop i : S1 [ (i = i1) -> base, (i = i0) -> base ]

-- By writing a function from the circle to the universe of types Type,
-- we can calculate winding numbers along the circle.

helix : S1 -> Type
helix = \case
  base -> Int
  loop i -> intPath i

winding : Path base base -> Int
winding p = transp (\i -> helix (p i)) (pos zero)

-- For instance, going around the loop once has a winding number of +1,

windingLoop : Path (winding (\i -> loop i)) (pos (succ zero))
windingLoop = refl

-- Going backwards has a winding number of -1 (remember the
-- representation of integers),

windingSymLoop : Path (winding (\i -> loop (inot i))) (neg zero)
windingSymLoop = refl

-- And going around the trivial loop (\i -> base) goes around the the
-- non-trivial loop (\i -> loop) zero times.

windingBase : Path (winding (\i -> base)) (pos zero)
windingBase = refl

-- One particularly general higher inductive type is the homotopy pushout,
-- which can be seen as a kind of sum B + C with the extra condition that
-- whenever x and y are in the image of f (resp. g), inl x ≡ inr y.

data Pushout {A : Type} {B : Type} {C : Type} (f : A -> B) (g : A -> C) : Type where
  inl : (x : B) -> Pushout f g
  inr : (y : C) -> Pushout f g
  push i : (a : A) -> Pushout f g [ (i = i0) -> inl (f a), (i = i1) -> inr (g a) ]

-- The name is due to the category-theoretical notion of pushout.
-- TODO: finish writing this tomorrow lol

data Susp (A : Type) : Type where
  north : Susp A
  south : Susp A
  merid i : A -> Susp A [ (i = i0) -> north, (i = i1) -> south ]

data Unit : Type where
  tt : Unit

poSusp : Type -> Type
poSusp A = Pushout {A} {Unit} {Unit} (\x -> tt) (\x -> tt)

poSusp_to_Susp : {A : Type} -> poSusp A -> Susp A
poSusp_to_Susp = \case
  inl x -> north
  inr x -> south
  push x i -> merid x i

Susp_to_poSusp : {A : Type} -> Susp A -> poSusp A
Susp_to_poSusp = \case
  north -> inl tt
  south -> inr tt
  merid x i -> push x i

Susp_to_poSusp_to_Susp : {A : Type} -> (x : Susp A) -> Path (poSusp_to_Susp (Susp_to_poSusp x)) x
Susp_to_poSusp_to_Susp = \case
  north -> refl
  south -> refl
  merid x i -> refl

unitEta : (x : Unit) -> Path x tt
unitEta = \case tt -> refl

poSusp_to_Susp_to_poSusp : {A : Type} -> (x : poSusp A) -> Path (Susp_to_poSusp (poSusp_to_Susp x)) x
poSusp_to_Susp_to_poSusp {A} = \case
  inl x -> cong inl (sym (unitEta x))
  inr x -> cong inr (sym (unitEta x))
  push x i -> refl

Susp_is_poSusp : {A : Type} -> Path (Susp A) (poSusp A)
Susp_is_poSusp {A} = univalence (IsoToEquiv (Susp_to_poSusp {A}, poSusp_to_Susp {A}, poSusp_to_Susp_to_poSusp {A}, Susp_to_poSusp_to_Susp {A}))