Translating Non-Classical Logics Into the Classical Logic by Using Hidden Variables

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Translating Non-Classical Logics Into the Classical Logic by Using Hidden Variables Translating non-classical logics into the classical logic by using hidden variables Juan C. Agudelo-Agudelo Institute of Mathematics, University of Antioquia, Medellin, Colombia Abstract It is here proposed a method for constructing conservative translations of logics character- ized by `dyadic semantics' (a kind of non-truth-functional bivalued semantics) into the classical logic. The method particularly works for several finite many-valued logics and paraconsistent logics. The translation method uses `hidden variables', which are propositional variables used to represent the indeterminism that arises when non-classical logics are provided of bivalued semantics. Then, it is shown that intuitionistic logic, for instance, is not characterizable by dyadic semantics, then the translation method here proposed do not applied for this logic. Moreover, it is provided an alternative method (not based on dyadic semantics) for construct- ing conservative translations of any finite many-valued logic into the classical logic. In this translation method `hidden variables' are also used, but in this case to represent the degree of true or falsehood of propositions. Introduction Suszko's thesis, as it is nowadays known, states that there are only two logical values, true and false, and that any many-valued logic can be provided with a bivalent semantics (cf. [12]). In [2], it is pointed out that Suszko's original presentation of this reductive result is quite non-constructive and it is provided a method for effectively construct a kind of bivalent semantics, which the authors call gentzenian semantics, for logics that has a truth-functional finite-valued semantics and a ‘sufficiently expressive language'. Then, the dyadic semantics is defined as a specialization of gentzenian semantics where `quasi-tabular' decision procedures can be stablished, \in a deliberate intent to capture the computable class of such semantics". Moreover, it is shown that some logics that are not characterizable by truth-functional finite-valued semantics are characterizable by dyadic semantics, as it is the case of da Costa's paraconsistet logic C1 (in [6], dyadic semantics for other paraconsistent logics are also defined). It is important to mention that dyadic semantics are generally non-truth-functional, but they are usefull, for instance, to define tableau decision procedures (cf. [3] and [4]). The non-truth-functional feature of dyadic semantics can be viewed as a kind of indeterminism. In [5], `hidden variables' are introduced for defining translations of paraconsistent logics, charac- terized by dyadic semantics, into polynomials with coefficients in Z2, providing in this way a proof method for these logics based on polynomial reduction rules. In such translations, hidden variables 1 are (algebraic) variables included in polynomials for representing the indeterminism of dyadic se- mantics. Here, in Section 1, instead of translating non-classical logics into polynomials, we will take advantage of the idea of hidden variables for constructing translations of non-classical logics characterized by dyadic semantics into the Classical Propositional Logic (CPL), showing in this way that non-classical reasoning can be interpreted in classical terms, but at the cost of introducing new (hidden) propositional variables and possibly increasing the complexity of formulas. Hidden variables are, in this context, used to represent the indeterminism that arises when non-classical logics are provided of bivalued semantics. The following question naturally arises, >is any propositional logic characterizable by a dyadic semantics and translatable into CPL by the method here proposed? A negative answer for this question is presented in Section 2, by showing that intuitionistic logic, for instance, is not char- acterizable by dyadic semantics and consequently the method here proposed for constructing con- servative translations into CPL does not applied for this logic. However, the scope of dyadic semantics is really wide, including many finite-valued logics (cf. [2]), logics not characterizable by a two-valued Avron's non-deterministic matrix (as it is the case of several paraconsistent logics in the hierarchy of logics of formal inconsistency introduced in [6], that are only characterizable by non-deterministic matrices with more than two values, cf. [1]), and even logics not characterizable by any finite non-deterministic matrix (as it is the case of C1, cf. [1]). As it was mentioned above, the method introduced in [2] for constructing a dyadic semantics for a finite-valued logic L demands that the logic has a ‘sufficiently expressive language'. This condition consists in requiring that, for any pair of truth values v1 and v2, there exists a formula '(p) in the language of L such that '(p) takes a designated truth value when p takes value v1 and takes an undesignated truth value when p takes value v2 (or vice versa). A condition that is not too restrictive, because many (if not all) genuinely finite-valued logics satisfy this condition. Consequently, by using the method in [2] and the method described in Section 1 below, conservative translations for many finite-valued logics into CPL can be obtained. However, in Section 3, we present a direct method (not based on dyadic semantics) for constructing conservative translations from any finite-valued logic into CPL, independently of the expressive power of its language. Hidden variables are in this method used for representing the degree of truth or falsehood of atomic propositions. A brief discussion of the translation methods here proposed and some possible future works are included in Section 4. 1 From dyadic semantics to conservative translations into the classical logic Before introducing the method for constructing conservative translations for logics characterized by dyadic semantics into CPL, some definitions are in order. For a finite set of connectives (or signature) C, an arity function A: C ! N and a denumerable set of propositional variables V = fp0; p1; p2;:::g, the set of formulas F orC generated by V over C is defined, as usual, as the term algebra of type C generated by V (it is, F orC is the least set containing V and closed under connectives in C). Having defined a set of formulas F orC , a logic is a structure L = hF orC ; i, where ⊆ P(F orC ) × F orC is called a consequence relation. A gentzenian semantics for a logic L, as defined in [2], is a set of bivalutions for formulas of 2 L determined by a set of `conditional clauses'. The following definitions consider a logic L = hF orC ; i. Definition 1. A bivaluation is any function v: F orC ! fT;F g (where T represents true and F represents false). Definition 2. A conditional clause is an expression φ =) , where both φ and are metaformulas of the form: 1 1 n1 n1 1 1 nm nm v('1) = w1; : : : ; v('1 ) = w1 j ::: jv('m) = wm; : : : ; v('m ) = wm ; j j where every 'i is a formula scheme of F orC and every wi is a truth value in fT;F g. In a conditional clause, `=)' represents implication, `,' represents conjunction and `j' represents disjunction. The metalogic that governs conditional clauses is the first order classical logic. Definition 3. Given a set of conditional clauses B, the set of bivaluations that satisfy all conditions in B is called a gentzenian semantics and is denoted by Sem(B) (i.e. Sem(B) = fv: F orC ! fT;F g j v satisfies all conditions in Bg). A gentzenian semantics allows to define the notion of model and a consequence relation in the usual way: Definition 4. Let B be a set of conditional clauses: • A bivaluation v 2 Sem(B) is a model of (or satisfies) a formula ' 2 F orC if v(') = T . The set of models of ', with respect to B, will be denoted by ModB('). • A bivaluation v is a model of (or satifies) a set of formulas Γ ⊆ F orC if it is a model of every formula in Γ. The set of models of Γ, with respect to B, will be denoted by ModB(Γ). • The consequence relation B is defined as follows: a formula ' is a consequence of a set of formulas Γ in B, which is denoted by Γ B ', if and only if ModB(Γ) ⊆ ModB('). • The logic L is characterized by the gentzenian semantics Sem(B) if = B. In this case, it is also said that Sem(B) is an adequate semantics for L. In shake of simplicity, the concept of dyadic semantics is here defined in a slightly different way than in [2]. Before of that, other two definitions are presented. Definition 5. A complexity measure is a function l: F orC ! N, such that l(') < l(δ) whenever ' is a subformula of δ. A function l: F orC ! N, defined by l(pi) = 0; for each propositional variable pi; and l(∗('1;:::;'n)) = maxfl('1); : : : ; l('n)g + 1; if ∗ is an n-ary connective in C; is a particular case of a complexity measure and will be called the canonical complexity measure for F orC . 3 Definition 6. A conditional clause c will be called admissible, with respect to a complexity measure l, if all formulas in the antecedent of c have strictly lower complexity than the formulas in the consequent. Definition 7. A gentzenian semantics, defined by a set of conditional clauses B, will be called a dyadic semantics if: 1. B is finite. 2. The consequent of every conditional clause in B has only one term (i.e. consequent of conditional clauses have the form v(') = w). 3. Formula schemes on the consequent of conditional clauses in B cover all compound formulas of F orC (i.e. any compound formula of F orC can be obtained by uniform substitution on some formula scheme on the consequent of a conditional clause in B). 4. There exists a recursively definable complexity measure l with respect to which all conditional clauses in B are admissible.
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