Finding Missing Proofs with Automated Reasoning* Branden
Total Page:16
File Type:pdf, Size:1020Kb
Load more
Recommended publications
-
Logical Calculi 0 ✬ ✩
Ernst, Fitelson, & Harris Some New Results in Logical Calculi 0 ✬ ✩ Some New Results in Logical Calculi Obtained Using Automated Reasoning Zac Ernst, Ken Harris & Branden Fitelson Department of Philosophy University of Wisconsin–Madison & AR @ MCS @ ANL July 13, 2001 ✫ ✪ AR @ MCS @ ANL July 13, 2000 Ernst, Fitelson, & Harris Some New Results in Logical Calculi 1 ✬ ✩ Overview of Presentation • Some Unfinished Business from Our Last Meeting – Classical Propositional Calculus in the Sheffer Stroke (D) – Classical Propositional Calculus in C and O • Some NewResults in Other Logical Calculi – NewBases for LG ( including new, shortest known single axioms) – NewBases for C5 ( including new, shortest known bases) – NewBases for C4 ( including new, shortest known single axiom) – NewBases for RM → (including new, shortest known bases) – Miscellaneous Results for E→,R→,RM→,and(L→ • Discussion of AR Techniques Used and Developed ... ✫ ✪ AR @ MCS @ ANL July 13, 2000 ✬Ernst, Fitelson, & Harris Some New Results in Logical Calculi 2✩ Sheffer Stroke Axiomatizations of Sentential Logic: I • At our last meeting, we reported some investigations into Sheffer Stroke axiomatizations of the classical propositional calculus. • In these systems, the only rule of inference is the following, somewhat odd, detachment rule for D: (D-Rule) From DpDqr and p,inferr. • Four 23-symbol single axioms have been known for many years.a (N) DDpDqrDDtDttDDsqDDpsDps ((L1) DDpDqrDDsDssDDsqDDpsDps ((L2) DDpDqrDDpDrpDDsqDDpsDps (W) DDpDqrDDDsrDDpsDpsDpDpq aThese axioms are discussed in [11], [5, pp. 179–196], and [22, pp. 37–39]. ✫ ✪ AR @ MCS @ ANL July 13, 2000 ✬Ernst, Fitelson, & Harris Some New Results in Logical Calculi 3✩ Sheffer Stroke Axiomatizations of Sentential Logic: II • As we reported last time, Ken and I were able to find many (60+) new23-symbol single axioms for this system, including: DDpDqrDDpDqrDDsrDDrsDps • Last year, we began to look for shorter single axioms. -
Mathematical Logic and Computers Some Interesting Examples
Introduction Classical Propositional Logic Intuitionistic Propositional Logic Double Negation Elimination Many-Valued Propositional Logic Modal Logic Conclusion Mathematical Logic and Computers Some interesting examples Michael Beeson San Jos´eState University August 28, 2008 Michael Beeson Logic and Computers Introduction Classical Propositional Logic Intuitionistic Propositional Logic Double Negation Elimination Many-Valued Propositional Logic Modal Logic Conclusion Introduction Classical Propositional Logic Various Axiomatizations Detachment and substitution Using resolution logic for a metalanguage Deriving Church from L1-L3 Single Axioms Strategy in resolution-based theorem provers Intuitionistic Propositional Logic The positive implicational calculus Axiomatizing the CN fragment of intuitionistic logic Full intuitionistic logic Heyting’s theses Single Axioms Double Negation Elimination Double Negation Elimination The pushback lemmaMichael Beeson Logic and Computers The 200 kilobyte proof Many-Valued Propositional Logic Semantics of many-valued logic Lukasiewicz’s A1-A5 Dependence of A4 Distributive Laws Modal Logic Modal Logic Resolution-based metatheory Triviality in non-classical modal logics Conclusion Areas we don’t have time to discuss Open Problems and current research Summary Introduction Classical Propositional Logic Intuitionistic Propositional Logic Double Negation Elimination Many-Valued Propositional Logic Modal Logic Conclusion Early History In 1954, within a few years after computers were first up and running, Martin -
Computer-Aided Studies of All Possible Shortest Single Axioms for the Equivalential Calculus
COMPUTER-AIDED STUDIES OF ALL POSSIBLE SHORTEST SINGLE AXIOMS FOR THE EQUIVALENTIAL CALCULUS J.A. Kalman and J.G. Peterson Department of Mathematics and Statistics University of Auckland, New Zealand ABSTRACT produces the formula w if u and y are unifiable and w=o(v) for some most general unifier o of u and y; w is then unique to within variance (i.e. It has been known since 1939 that for a for• a formula w' may be produced by applying conden• mula to be a single axiom for the equivalential sed detachment to x and y if and only if w' is a calculus its length must be at least 11, and that variant of w), and it is customary to write single axioms of this length exist. Also, a single w»Dxy ; if x and y have variables in common, and axiom of length 11 must have the two-property. y' is a variant of y having no variables in common There are 630 formulas with the two-property and of with x, then Dxy is defined if and only if Dxy' is length 11. With computer assistance, the authors defined, and if Dxy' is defined we set Dxy«Dxy' . have shown that 612 of these 630 formulas are not Thus, if S is a deductive axiomatization of EC, single axioms. The main object of this paper is to and T is a set of equivalential tautologies such outline the methods used to obtain these results. that every formula in S is a substitution instance This paper logically precedes a recent paper of of a formula derivable by condensed detachment L. -
Logical Basis for the Automation of Reasoning: Case Studies1
Logical Basis for the Automation of Reasoning: Case Studies1 Larry Wos, Robert Veroff, and Gail W. Pieper Contents 1 Introduction . 1 2 The clause language paradigm . 3 2.1 Components of the clause language paradigm . 4 2.2 Interplay of the components . 6 3 A fragment of the history of automated reasoning 1960{2002 . 7 4 Answering open questions . 9 4.1 Robbins algebra . 10 4.2 Boolean algebra . 11 4.3 Logical calculi . 12 4.4 Combinatory logic . 14 4.5 Ortholattices . 15 5 Missing proofs and simpler proofs . 16 6 The clause language paradigm and other types of reasoning . 18 6.1 Logic programming . 19 6.2 Person-oriented reasoning . 21 7 Challenge problems for testing, comparing, and evaluating . 22 7.1 Combinatory logic . 22 7.2 Logical calculi . 23 7.3 Algebra . 24 8 Current state of the art . 25 9 Programs, books, and a database . 27 9.1 Reasoning programs for diverse applications . 27 9.2 Books for background and further research . 28 9.3 A database of test problems . 29 10 Summary and the future . 29 References . 31 1 Introduction With the availability of computers in the late 1950s, researchers began to entertain the possibility of automating reasoning. Immediately, two distinctly different approaches were considered as the possible basis for that automation. In one approach, the intention was to study and then emulate people; in the other, the plan was to rely on mathematical logic. 1This work was supported by the Mathematical, Information, and Computational Sciences Division subprogram of the Office of Advanced Scientific Computing Research, U.S. -
On the Number of Unary-Binary Tree-Like Structures with Restrictions
On the number of unary-binary tree-like structures with restrictions on the unary height Olivier Bodini,∗ Danièle Gardy,† Bernhard Gittenberger,‡ Zbigniew Gołębiewski,§ August 7, 2018 Abstract We consider various classes of Motzkin trees as well as lambda-terms for which we de- rive asymptotic enumeration results. These classes are defined through various restrictions concerning the unary nodes or abstractions, respectively: We either bound their number or the allowed levels of nesting. The enumeration is done by means of a generating function approach and singularity analysis. The generating functions are composed of nested square roots and exhibit unexpected phenomena in some of the cases. Furthermore, we present some observations obtained from generating such terms randomly and explain why usually powerful tools for random generation, such as Boltzmann samplers, face serious difficulties in generating lambda-terms. 1 Introduction This paper is mainly devoted to the asymptotic enumeration of lambda-terms belonging to a certain subclass of the class of all lambda-terms. Roughly speaking, a lambda-term is a formal expression built of variables and a quantifier λ which in general occurs more than once and acts on one of the free variables of the subsequent sub-term. Lambda calculus is a set of rules for manipulating lambda-terms and was invented by Church and Kleene in the 30ies (see [35, 36, 16]) in order to investigate decision problems. It plays an important rôle in computability theory, for automatic theorem proving or as a basis for some programming languages, e.g. LISP. Due to its flexibility it can be used for a formal description of programming in general and is therefore an essential tool for analyzing programming languages (cf. -
A Finitely Axiomatized Formalization of Predicate Calculus with Equality
A Finitely Axiomatized Formalization of Predicate Calculus with Equality Note: This is a preprint of Megill, \A Finitely Axiomatized Formalization of Predicate Calculus with Equality," Notre Dame Journal of Formal Logic, 36:435-453, 1995. The paper as published has the following errata that have been corrected in this preprint. • On p. 439, line 7, \(Condensed detachment)" should be followed by a reference to a footnote, \The arrays start at index i = 1. In Step 3, i is increased before each comparison is made." • On p. 446, line 17, \unnecessary" is misspelled. • On p. 448, 2nd line from bottom, \that in Section 8." should be followed by \In addition, S30 has the following stronger property." • On p. 449, line 22, \ui" should be \u1". • On p. 450, line 27, \Dpq" should be \Dqp". • On p. 451, line 2, \shorter proof string" should be followed by a reference to a footnote, \Found by the Otter theorem prover [20]." In August 2017, Tony H¨ager identified and provided the proofs for two miss- ing lemmas needed for the Substitution Theorem proof, and also found some shorter proofs for other lemmas. The necessary corrections have not yet been incorporated in this preprint but can be found in the discussion starting at https://groups.google.com/d/msg/metamath/t2G8X-dvTbA/Tqfxeo1sAwAJ A Finitely Axiomatized Formalization of Predicate Calculus with Equality July 7, 1995 Abstract We present a formalization of first-order predicate calculus with equality which, unlike traditional systems with axiom schemata or substitution rules, is finitely axiomatized in the sense that each step in a formal proof admits only finitely many choices. -
Proof Finding Algorithms for Implicational Logics
Theoretical Computer Science 232 (2000) 165{186 www.elsevier.com/locate/tcs View metadata, citation and similar papers at core.ac.uk brought to you by CORE Proof ÿnding algorithms for implicational logics provided by Elsevier - Publisher Connector M.W. Bunder Mathematics Department, University of Wollongong, Wollongong, NSW 2522, Australia Abstract The work in Bunder (Theoret. Comput. Sci. 169 (1996) 3{21) shows that for each one of many implicational logics the set of all lambda terms, that represent proofs in that logic, can be speciÿed. This paper gives, for most of these logics, algorithms which produce, for any given formula, a form of minimal proof within a ÿxed number of steps or otherwise a guarantee of unprovability. For the remaining logics there are similar algorithms that produce proofs, but not within a ÿxed number of steps. The new algorithms have been implemented in Oostdijk (Lambda Cal2). c 2000 Elsevier Science B.V. All rights reserved. Keywords: Proof ÿnding algorithms; Lambda calculus; Combinatory logic; Types; Substructural logics 1. Introduction An implicational logic can be speciÿed by the rule → ÿ → e ÿ and a set of axiom schemes. In this paper the axiom schemes we will be interested in will be taken from the following list: I → K → ÿ → B ( → ÿ) → ( → ) → → ÿ B0 ( → ÿ) → (ÿ → ) → → E-mail address: [email protected] (M.W. Bunder) 0304-3975/00/$ - see front matter c 2000 Elsevier Science B.V. All rights reserved. PII: S0304-3975(99)00174-7 166 M.W. Bunder / Theoretical Computer Science 232 (2000) 165{186 C ( → ÿ → ) → ÿ → → W ( → → ÿ) → → ÿ S ( → ÿ → ) → ( → ÿ) → → T → ( → ÿ → ) → ÿ → Logics will be named by their axiom schemes. -
Missing Proofs Found
Missing Pro ofs Found Branden Fitelson University of Wisconsin Department of Philosophy Madison WI and Mathematics and Computer Science Division Argonne National Lab oratory Argonne IL email telsonfacstawiscedu Larry Wos Mathematics and Computer Science Division Argonne National Lab oratory Argonne IL email wosmcsanlgov Abstract For close to a century despite the eorts of ne minds that include Hilb ert and Ackermann Lukasiewicz and Rose and Rosser various pro ofs of a number of signi cant theorems have remained missingat least not rep orted in the literatureamply demonstrating the depth of the corresp onding problems The types of such missing pro ofs are indeed diverse For one example a result may b e guaranteed provable b e cause of b eing valid and yet no pro of has b een found For a second example a theorem may have b een proved via metaargument but the desired axiomatic pro of based solely on the use of a given inference rule may have eluded the exp erts For a third example a theorem may have b een announced by a master but no pro of was supplied The nding of missing pro ofs of the cited types as well as of other types is the fo cus of this article The means to nding such pro ofs rests with heavy use of McCunes automated reasoning program OTTER reliance on a variety of p owerful strategies this program oers and employment of diverse metho dologies Here we present some of our successes and b ecause it may prove useful for circuit design and program synthesis as well as in the context of mathematics and logic detail our approach -
From Automated Theorem Proving to Nuclear Structure Analysis with Self- Scheduled Task Parallelism
Computational Nuclear Physics A Symposium in Honor of Steven C. Pieper 1 From Automated Theorem Proving to Nuclear Structure Analysis with Self- Scheduled Task Parallelism (a personal history of one programming model) Rusty Lusk (Ralph Butler) Mathematics and Computer Science Division Argonne National Laboratory Theme § Application programming models should be simple. § Their instantiations might be more complex, and their actual API’s might be even more so, not to mention their implementations. § Also, the programming models of the libraries that implement them might be more complex. § For example, the message passing model is simple: people are familiar with it from physical mail, phone calls, email, etc. § There have been several instantiations (PVM, Express, EUI, p4, etc.) and multiple implementations of MPI. – As an application programming model, MPI is simple because applications use the simple parts – the more exotic parts of MPI are used by libraries to implement simple application programming models (or should be). § MPI’s full API is a really a system programming model, driven by library developers developing portable libraries that implement simple programming models for applications. Example § Let’s discuss a simple programming model which has managed to remain simple through a number of instantiations and implementations. § It is related to, but not the same as, several current task-based systems. § It was how I wrote my first non-trivial parallel programs, back before the term “programming model” was in use (I didn’t know it was a programming model). § I call it “self-scheduled task parallelism” (SSTP). My first work in computer science, after a stab at (very) pure mathematics, was in automated theorem-proving, at Argonne with Larry Wos, Ross Overbeek, and Bill McCune. -
Distributivity in Lℵ0 and Other Sentential Logics
2 Harris & Fitelson Distributivity inL ℵ0 and Other Sentential Logics We choose Polish notation not just because of its historical dominance in this area, but also because of its syntactic economy. Some of the proofs we will present are quite complex and would be difficult to parse Kenneth Harris and Branden Fitelson and/or typeset in either the infix or the prefix notation used by Otter. University of Wisconsin–Madison The proofs presented in this paper have been translated directly 2 November 10, 2000 from Otter output files into our Polish notation. Hyperresolution is used, throughout, to implement all logical rules of inference in the Abstract. Certain distributivity results forLukasiewicz’s infinite-valued logicL ℵ0 are proved axiomatically (for the first time) with the help of the automated reasoning systems presented. The notation ‘[i, j, k]’written to the left of each program Otter [16]. In addition, non-distributivity results are established for a formula in our proofs is shorthand for ‘the present formula was obtained wide variety of positive substructural logics by the use of logical matrices discovered by applying the rule at line i (via a single hyperresolution step), with with the automated model findingprograms Mace [15] and MaGIC [25]. the formula at line j as major premise and the formula at line k as minor premise.’Rules of inference are stated using commas to separate the Keywords: distributivity, sentential, logic,Lukasiewicz, detachment, substructural premises of the rule, and a double arrow ‘⇒’to indicate its conclusion. For instance, modus ponens (or detachment) looks like: ‘Cpq,p ⇒ q’. 1. -
1 the Open Questions
Answers to Some Open Questions of Ulrich & Meredith Matthew Walsh & Branden Fitelson† 06/26/21 1 The Open Questions Ulrich [11] poses twenty six open questions concerning the axiomatization of various sentential logics. In this note, we report solutions to three of these open questions involving axiomatizations of classical sentential logic. We adopt Ulrich’s notation (viz., traditional, Polish notation) throughout. And, the sole rule of inference we will be assuming throughout is condensed detachment [2]: from Cpq and p infer q (where C is the implication operator, and where most general substitution instances are used in each modus ponens inference). (Q1) Is Meredith’s [9] 21-symbol single axiom (M1) CCCCCpqCNrNsrtCCtpCsp for classical sentential logic the shortest possible (where N is the negation operator)? (Q2) Are Meredith’s [9] two 19-symbol single axioms (M4) CCCCCpqCrfstCCtpCrp (M5) CCCpqCCf r sCCspCtCup for classical sentential logic the shortest possible (where f is the constant falsum operator, which is equivalent to an arbitrary classical contradiction)? (Q3) Are Meredith’s [10] two 19-symbol single axioms (M2) CCCpqCrCosCCspCrCtp (M3) CCCpqCor CsCCr pCtCup for classical sentential logic the shortest possible (where o is the constant verum operator, which is equivalent to an arbitrary classical tautology)? In the next section, we report affirmative answers to each of these three questions, and we also report several new single axioms (of shortest length) for each of these three systems of classical sentential logic (thus answering three open questions posed by Meredith himself). Along the way, we will also pose several new open questions pertaining to these axiomatic systems. -
1. D-Completeness and D-Incompleteness
Bulletin of the Section of Logic Volume 34/3 (2005), pp. 135{142 Dolph Ulrich D-COMPLETE AXIOMS FOR THE CLASSICAL EQUIVALENTIAL CALCULUS Abstract Virtually all previously known axiom sets for the classical equivalential calculus, EQ, are D-incomplete: not all theorems derivable by substitution and detach- ment can be derived using the rule D of condensed detachment alone. The only exception known to the author is Wajsberg's base fEEpEqrErEqp, EEEppppg. This axiom set, albeit inorganic since one of its members contains a theorem of EQ as a proper subformula, is here shown to be D-complete. D-complete single axioms for EQ are then constructed, culminating with EEpqEErqEsEsEsEsEpr which has the distinction of being both D-complete and organic. 1. D-completeness and D-incompleteness The well-formed formulas of the classical equivalential calculus are built in the usual way from a binary connective E and denumerably many sentence letters p; q; r; : : : ; p1; p2;::: : each sentence letter is well-formed, and if ® and ¯ are well-formed, so is E®¯. Let EQ be the set of such formulas in which each sentence letter occurring occurs an even number of times. The members of EQ are, as ¯rst noted by Le¶sniewski[7], exactly the formulas that are tautologies of the standard two-valued truth-table for material equivalence. For each set A of formulas, let the A-theorems be the formulas deriv- able from members of A using the rules of substitution and detachment (that is, modus ponens). A subset A of EQ is a complete axiom set, or base, for EQ, if and only if the set of A-theorems is exactly EQ.