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A step-by-step proof of Open Induction by Bar Induction

The purpose of this post is a detailed proof, following Coquand[1], of the Open Induction Principle using Decidable-Bar Induction[2].

Open induction (OI) is useful when one can not do a proof by usual well-founded induction, that is, when there is no well-founded relation that can be used. In such cases, if the space one is in is compact, and the property one wants to prove is open, one can use a non-well-founded order to do an induction proof. From the computer science perspective, this means one can build a terminating recursive program for computing a property that does not depend on a structurally decreasing criterium of termination.

In this post we concentrate on Cantor space 2N, but it is, in some sense, enough, because every compact space is an image of Cantor space. A member α of 2N is a map N2, i.e. an infinite stream of bits, i.e. an infinite branch of the infinite binary tree. α<β if α is “left of” β as a branch of the infinite tree, that is, α<β if they are bit streams which are equal for a finite initial segment and then at some length n of the segment α(n) is “left” while β(n) is “right”. We write αn for the finite initial segment of α of lenght n. Each node in the infinite binary tree corresponds to some initial segment, and vice-versa. Each such node, i.e. each finite bit string, is called a basic open. An open, or open subspace, of Cantor space is an arbitrary union of basic opens. Equivalently, an open is determined by a Boolean function G on arbitrary lenght, but finite, bit strings, G : 2*2, which is monotone: If s, s′:2*, s is an initial segment of s′, and G(s)=⊤, then also G(s′)=⊤.

Axiom 1 (Decidable-Bar Induction)   For all unary predicates P and Q on 2* (finite binary strings), such that P is decidable and s. P sQ s, if
  ∀ α∈2N. ∃ n∈ NP(
α
n)
and
  ∀ s2*. (∀ b∈ 2Q ⟨ b::s ⟩) → Q s
then
  Q ⟨ ⟩
.
Theorem 2 (Open Induction Principle)   Let U be an open set of Cantor space 2N and < be a lexicographic ordering on 2N. If
∀ α. (∀ β<α. β∈ U) → α∈ U     (*)
then
  ∀ α. α∈ U.

Proof. Let α : 2N be given. U is open in 2N, hence given by a mapping G : 2*2 which is monotone w.r.t. initial segments: if s is a prefix of t, G s = ⊤ implies G t = ⊤. We say that G bars s with witness k (notation G|k s) if all k−bit-extensions of s satisfy G.

We define mutually, by (primitive) recursion on finite strings of numbers, two functions f:N*2* and acc:N*2:

    acc⟨ ⟩= ⊤ 
    acc⟨ 0::s ⟩acc(s)
    acc⟨ n+1::s ⟩acc(s) ∧ G|n ⟨ ⊥::f(s) ⟩ 
   
    f⟨ ⟩= ⟨ ⟩ 
    f⟨ 0::s ⟩= ⟨ ⊥::f(s) ⟩
    f⟨ n+1::s ⟩= ⟨ acc⟨ n+1::s ⟩::f(s) ⟩

We set

  P(s) := G(f(s))
  Q(s) := acc(s) → ∃ mG|m f(s)

and apply bar induction, which gives us a proof of Q(⟨ ⟩), which, since acc(⟨ ⟩)=⊤, gives an mN such that any bit-string with length m satisfies G. Hence, also αm, therefore α∈ U.

The hypotheses of (D-BI) are satisfied by the following lemmas.


Lemma 3   ∀ α∈NN. ∃ nN. G(f(αn))

Proof. We write f(α) for the natural exension of f to infinite sequences. The lemma states that ∀ α∈NN. f(α)∈ U. Let α be given. Apply (*). Let β<f(α), that is, there is some n such that βn = ⟨ ⊥::s ⟩ and ⟨ ⊤::s ⟩ = f(α) n = f(αn) for some s2* (of length n−1). By the defining equations of f and app, n>0, s=f(α(n−1)), acc(s) and G|k⟨ ⊥::s ⟩, that is, G|kβn, for some k. Hence, G(β(n+k)) = ⊤ i.e. β∈ U.


Lemma 4   For any sN*, if
(∀ nNacc⟨ n::s ⟩ → ∃ mG|m f⟨ n::s ⟩),
and acc(s), then n. G|n f(s).

Proof. Since acc(s), also acc⟨ 0::s ⟩, and the hypothesis gives us an m such that G|mf⟨ 0::s ⟩, that is, G|m⟨ ⊥::f(s) ⟩. This means that accm+1::s ⟩, which we use with the hypothesis again to get a k such that G|kfm+1::s ⟩ i.e. Gkaccm+1::s ⟩::f(s) ⟩ i.e. G|k⟨ ⊤::f(s) ⟩. We showed that G bars both ⟨ ⊤::f(s) ⟩ and ⟨ ⊥::f(s) ⟩, which means that G bars f(s) already: G|max(m,k)f(s).


Lemma 5   sN*. G(f(s)) → acc(s) → ∃ m. G|m f(s).

Proof. G(f(s)) iff G|0 f(s).


Remark 6  The given lemmas, and the functions f and acc, are more general than needed for (D-BI), since they take input of type N* instead of 2*.

References

[1]
Thierry Coquand. A note on the open induction principle, 1997.
[2]
Anne S. Troelstra and Dirk van Dalen. Constructivism in Mathematics: An Introduction I and II, volume 121, 123 of Studies in Logic and the Foundations of Mathematics. North-Holland, 1988.

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