Abstract
The paper surveys ideas, results and applications of a novel proof-theoretical approach to equational theories of untyped operations (including combinatory logic CL and Lambda-calculus) we developed in the last 15 years. The approach is based on the introduction and the proof-theoretical investigation of “analytic” proof systems for such theories. Analyticity is due to a main result of transitivity elimination, yielding as a consequence a non trivial streamlining of the proof-theory of the corresponding theories and a number of applications. Among these, a positive solution to an open problem concerning the theory of combinatory strong reduction which was raised about 60 years ago by H.B. Curry.
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Notes
- 1.
In Curry’s terminology (cf. Curry and Feys 1958, sect. 5 C ff.) ‘pure’ is ‘proper’, and ‘linear’ is ‘not having a duplicative effect’.
- 2.
A substitution rule is not needed, as far as axioms are given in a schematic form.
- 3.
\(\mathbb {X}\) is recursive iff the map \(n\mapsto k_{\mathsf {F}_n}\) is recursive, and \(\left <d_{\mathsf {F}_n}\right >_{n\geq 0}\) is a recursive sequence of T X-terms.
- 4.
In such a way, see Lemma 4.8, that (Ext)-free derivations are transformed into τ-free and (Ext)-free derivations of the same end-equation.
- 5.
The motivation is that if I is defined, as in CL, out of K and S (I := S K K) instead of being taken as a primitive combinator, then (because of the fact that S K K I does hold) one has I ≡S K K K I K K(K I K)K… and so there is combinatory term in strong normal form (λ ∗ x.x ≡S K K) which is not strongly irreducible. As soon as the variant with I as a primitive combinator is adopted, it holds that strongly irreducible terms are in strong normal form (Normal Form Theorem, first proved by Curry (Curry and Feys 1958); a shorter proof is due to Hindley and Lercher 1970), and conversely (Converse Normal Form Theorem, Lercher 1967).
- 6.
Here is the inductive definition of λ ∗ x.t:
$$\displaystyle \begin{aligned}\lambda^* x.t := \left\{ \begin{array}{ll} \mathsf{I}, & \text{if }\text{ (a) }{t\equiv x}, \\ t', & \text{if }\text{ (b) }{t\equiv t'x}\text{ with }{x\notin V(t')}, \\ \mathsf{K} t, & \text{if }\text{ (c) }{x\notin V(t)}; \\ \mathsf{S}(\lambda^* x.t_1)(\lambda^* x.t_2), & \text{if }\text{ (d) }{t\equiv t_1t_2}\text{ and (b), (c) do not apply.} \end{array} \right. \end{aligned} $$ - 7.
Indeed, it is easy to verify that if tx ↠βη r and x∉V (t) then one of the following cases does hold: either r has the form r′x with x∉V (r′) and t ↠βη r′, or (ii) r is not of that form and t ↠βη λx.r.
- 8.
Another direct confluence proof, independent and indeed very different from ours, has been given in the same year by René David (2009).
- 9.
Here is Hindley’s statement of the problem: “The βη-strong reduction is the combinatory analogue of βη-reduction in λ-calculus. It is confluent. Its only known confluence-proof is very easy […], but it depends on the having already proved the confluence of λβη-reduction. Thus the theory of combinators is not self-contained at present. Is there a confluence proof independent of λ-calculus?”
- 10.
\(N_E = \frac {( \mathtt {c}(E)+1)( \mathtt {c}(E)+2)}{2}\cdot \mathtt {i}(E)+(\mathtt {a}(E)+1)\cdot (\mathtt {c}(E)+1)\) where, for E ≡ (t = s): c(E) := the number of occurrences of combinators in ts, \(\mathtt {i}(E):=\max \left \{k_{\mathsf {F}}\mid \mathsf {F}\text{ occurs in }ts\right \}\), and \(\mathtt {a}(E):=\min (\mathtt {w}(t),\mathtt {w}(s))\).
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Minari, P. (2019). Analytic Equational Proof Systems for Combinatory Logic and λ-Calculus:A Survey. In: Centrone, S., Negri, S., Sarikaya, D., Schuster, P.M. (eds) Mathesis Universalis, Computability and Proof. Synthese Library, vol 412. Springer, Cham. https://doi.org/10.1007/978-3-030-20447-1_13
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