Introduction to Type Theory February 2008 Alpha Lernet Summer School Piriapolis, Uruguay. Herman Geuvers Nijmegen & Eindhoven, NL
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1 Introduction to Type Theory February 2008 Alpha Lernet Summer School Piriapolis, Uruguay Herman Geuvers Nijmegen & Eindhoven, NL Lecture 3: Polymorphic Type Theory: Full polymorphism and ML style polymorphism 1
2 Why Polymorphic λ-calculus? Simple type theory λ is not very expressive In simple type theory, we can not reuse a function. E.g. λx:α.x : α α and λx:β.x : β β. We want to define functions that can treat types polymorphically: add types α.σ: Examples α.α α If M : α.α α, then M can map any type to itself. α. β.α β α If M : α. β.α β α, then M can take two inputs (of arbitrary types) and return a value of the first input type. 2
3 Derivation rules for Weak (ML-style) polymorphism Typ : add α α n.σ for σ a λ -type. 1. Curry style: Γ M : σ α / FV(Γ) Γ M : α.σ 2. Church style: Γ M : σ α / FV(Γ) Γ λα.m : α.σ Γ M : α.σ for τ a λ -type Γ M : σ[α := τ] Γ M : α.σ for τ a λ -type Γ Mτ : σ[α := τ] only occurs on the outside and is therefore usually left out: all type variables are implicitly universally quantified With weak polymorphism, type checking is still decidable: the principal types algorithm still works. 3
4 Derivation rules for Weak (ML-style) polymorphism NB! Also the abstraction rule is restricted to λ -types: 1. Curry style: Γ, x : τ M : σ τ a λ -type Γ λx.m : τ σ 2. Church style: Γ, x : τ M : σ τ a λ -type Γ λx:τ.m : τ σ 4
5 Examples λ2 à la Curry: λx.λy.x : α. β.α β α. λ2 à la Church: λα.λβ.λx:α.λy:β.x : α. β.α β α. λ2 à la Curry: z : α.α α z z : α.α α. λ2 à la Church: z : α.α α λα.z (α α) (z α) : α.α α. But NOT λz.z z :... 5
6 Derivation rules of λ2 with full (system F-style) polymorphism Typ := TVar (Typ Typ) α.typ 1. Curry style: Γ M : σ Γ M : α.σ α / FV(Γ) Γ M : α.σ Γ M : σ[α := τ] for τ any λ2-type 2. Church style: Γ M : σ Γ M : α.σ α / FV(Γ) Γ λα.m : α.σ Γ Mτ : σ[α := τ] can also occur deeper in a type. for τ any λ2-type With full polymorphism, type checking becomes undecidable! [Wells 1993] 6
7 Derivation rules of λ2 with full (system F-style) polymorphism Typ := TVar (Typ Typ) α.typ NB: In the abstraction rule all types are λ2-types: 1. Curry style: Γ, x : τ M : σ σ, τ λ2-types Γ λx.m : τ σ 2. Church style: Γ, x : τ M : σ σ, τ λ2-types Γ λx:τ.m : τ σ 7
8 Erasure from λ2 à la Church to λ2 à la Curry x := x λx:σ.m := λx.m λα.m := M MN := M N Mσ := M Theorem If Γ M : σ in λ2 à la Church, then Γ M : σ in λ2 à la Curry. Theorem If Γ P : σ in λ2 à la Curry, then there is an M such that M P and Γ M : σ in λ2 à la Church. 8
9 Derivation rules of λ2 with full (system F-style) polymorphism Typ := TVar (Typ Typ) α.typ 1. Curry style: Γ M : σ Γ M : α.σ α / FV(Γ) for τ any λ2-type Γ M : α.σ Γ M : σ[α := τ] 2. Church style: Γ M : σ Γ M : α.σ α / FV(Γ) for τ any λ2-type Γ λα.m : α.σ Γ Mτ : σ[α := τ] Examples valid only with full polymorphism: λ2 à la Curry: λx.λy.x : ( α.α) σ τ. λ2 à la Church: λx:( α.α).λy:σ.xτ : ( α.α) σ τ. 9
10 Let polymorphism in ML To regain some of the full polymorphism, ML has let polymorphism Γ M : σ Γ, x : σ N : τ for τ a λ -type, σ a λ2-type Γ let x = M in N : τ This allows the formation of a β-redex for σ a polymorphic type. But not λx:σ.n : σ τ (λx:σ.n)m 10
11 Recall: Important Properties Γ M : σ? Γ M :? TCP TSP? : σ TIP Properties of polymorphic λ-calculus TIP is undecidable, TCP and TSP are equivalent & decidable. TCP à la Church à la Curry ML-style decidable decidable System F-style decidable undecidable With full polymorphism (system F), untyped terms contain too little information to compute the type. 11
12 Some examples of typing in λ2 Abbreviate := α.α, := α.α α. Curry λ2: λx.xx : Church λ2: λx:.x( )x :. Church λ2: λx:.λα.x(α α)(xα) :. Exercises: Verify that in Church λ2: λx:.x x :. Verify that in Curry λ2: λx.xx : Find a type in Curry λ2 for λx.xxx Find a type in Curry λ2 for λx.(xx)(xx) 12
13 Formulas-as-types for λ2 There is a formulas-as-types isomorphism between λ2 and second order proposition logic, PROP2 Derivation rules of PROP2: Γ σ Γ α.σ α / FV(Γ) Γ α.σ Γ σ[α := τ] NB This is constructive second order proposition logic: is not derivable. α. β.((α β) α) α Peirce s law 13
14 Definability of the other connectives σ τ σ τ α.σ := α.α := α.(σ τ α) α := α.(σ α) (τ α) α := β.( α.σ β) β and all the standard constructive derivation rules are derivable. Example ( -elimination): α.(σ τ α) α (σ τ σ) σ σ [σ] 1 τ σ σ τ σ 1 14
15 Definability of connectives and derivation rules σ τ σ τ α.σ := α.α := α.(σ τ α) α := α.(σ α) (τ α) α := β.( α.σ β) β Example ( -elimination) with λ-terms: [x : σ] 1 M : α.(σ τ α) α λy:τ.x : τ σ Mσ : (σ τ σ) σ λx:σ.λy:τ.x : σ τ σ Mσ(λx:σ.λy:τ.x) : σ So the following term is a witness for the -elimination. 1 λz:σ τ.z σ (λx:σ.λy:τ.x) : (σ τ) σ 15
16 Data types in λ2 Nat := α.α (α α) α This type uses the encoding of natural numbers as Church numerals n c n := λx.λf.f(... (fx)) n-times f 0 := λα.λx:α.λf:α α.x S := λn:nat.λα.λx:α.λf:α α.f(nαxf) Iteration: if c : σ and g : σ σ, then It c g : Nat σ is defined as λn:nat.nσ c g Then Itcg n = g(...(g c)) (n times g), i.e. Itcg 0 = c and It c g (S x) = g(it c g x) 16
17 Why is this a good/useful type for the natural numbers? It s the straightforward type for the Church numerals. It represents the type of proofs that a number is inductive in second order predicate logic: 0 : D, S : D D N(x) := P.P 0 ( y.p y P (S y)) P x N(x) iff x is in the smallest set containing 0 and closed under S. E.g. N(0), (N(S 0),..., N(S p (0)). Stripping all first order information (moving from PRED2 to PROP2): N := P.P (P P) P The normal proof of N(S p (0)) is the Church numeral c n under a suitable Curry-Howard embedding. 17
18 Examples Addition Plus := λn:nat.λm:nat.itms n or Plus := λn:nat.λm:nat.n Nat m S Multiplication Mult := λn:nat.λm:nat.it 0 (λx:nat.plus m x) n Predecessor is difficult! This requires defining primitive recursion in terms of iteration. As a consequence: Pred(n + 1) β n in a number of steps of O(n). 18
19 Data types in λ2 ctd. List A := α.α (A α α) α the type of lists over A, using the following encoding [a 1, a 2,...,a n ] λx.λf.fa 1 (fa 2 (...(fa n x))) n-times f Nil := λα.λx:α.λf:a α α.x Cons := λa:a.λl:list A.λα.λx:α.λf:A α α.f a(l α xf) Iteration: if c : σ and g : A σ σ, then It c g : List A σ is def. as λl:list A.l σ c g Then, for l = [a 1,...,a n ], Itcg l = g a 1 (...(g a n c)) (n times g) i.e. It c g Nil = c and It c g (Cons a l) = g a (Itcg l) 19
20 Example Map, given f : σ τ, Mapf : List σ List τ applies f to all elements in a list. Then Map := λf:σ τ.it Nil(λx:σ.λl:List τ.cons(f x)l). Map f Nil = Nil Mapf (Cons a k) = It Nil(λx:σ.λl:List τ.cons(f x)l) (Consak) = (λx:σ.λl:list τ.cons(f x)l)a(mapf k) = Cons(f a)(map f k) 20
21 Many data-types can be defined in λ2 Product of two data-types: σ τ := α.(σ τ α) α Sum of two data-types: σ+τ := α.(σ α) (τ α) α Unit type: Unit := α.α α Binary trees with nodes in A and leaves in B: Tree A,B := α.(b α) (A α α α) α Exercise: Define inl : σ σ + τ Define the first projection: π 1 : σ τ σ Define join : Tree A,B Tree A,B A Tree A,B 21
22 Properties of λ2 For λ2 à la Church: Uniqueness of types If Γ M : σ and Γ M : τ, then σ = τ. Subject Reduction If Γ M : σ and M βη N, then Γ N : σ. Strong Normalization If Γ M : σ, then all βη-reductions from M terminate. 22
23 Strong Normalization of β for λ2 There are two kinds of β-reductions (λx:σ.m)p β M[x := P] (λα.m)τ β M[α := τ] The second does no harm, so we can just look at λ2 à la Curry Recall the proof for λ : [α] := SN. [σ τ ] := {M N [σ](mn [τ ])}. Question: How to define [ α.σ]?? [ α.σ] := Π X U [σ] α:=x?? 23
24 Strong Normalization of β for λ2 Question: How to define [ α.σ]?? [ α.σ] := Π X U [σ] α:=x?? What should be U? The collection of all possible interpretations of types (?) Π X U [σ] α:=x gets too big: card(π X U [σ] α:=x ) > card(u) Girard: [ α.σ] should be small Girard: Definition of U. X U [σ] α:=x 24
25 Strong Normalization of β for λ2 U := SAT, the collection of saturated sets of (untyped) λ-terms. X Λ is saturated if xp 1...P n X (for all x Var, P 1,...,P n SN) X SN If M[x := N] P X and N SN, then (λx.m)n P X. Let ρ : TVar SAT be a valuation of type variables. Define [σ] ρ by: [α] ρ := ρ(α) [σ τ ] ρ := {M N [σ] ρ (MN [τ ] ρ )} [ α.σ] ρ := X SAT [σ] ρ,α:=x 25
26 Proposition x 1 : τ 1,...,x n : τ n M : σ M[P 1 /x 1,...,P n /x n ] [σ] ρ for all valuations ρ and P 1 [τ 1 ] ρ,...,p n [τ n ] ρ Proof By induction on the derivation of Γ M : σ. Corollary λ2 is SN (Proof: take P 1 to be x 1,..., P n to be x n.) 26
27 A little bit on semantics Theorem: If λ2 does not have a set-theoretic model! [Reynolds] [σ τ ] := [τ ] [σ] ( set theoretic function space ) then [σ] is a singleton set for every σ. So: in a λ2-model, [σ τ ] must be small. 27
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