Commit 91cc4eb4 by Mickael Laurent

### more formal completeness corrolary

parent 638c93a5
 ... ... @@ -1476,24 +1476,33 @@ \end{description} \end{proof} $\begin{array}{lrcl} \textbf{Simple type} & t_{s} & ::= & b \alt \pair {t_{s}} {t_{s}} \alt t_{s} \vee t_{s} \alt \neg t_{s} \alt \Empty \alt \arrow \Empty \Any\\ \textbf{Positive type} & t_+ & ::= & t_{s} \alt t_+ \vee t_+ \alt t_+ \land t_+ \alt \arrow {t_+} {t_+} \alt \arrow {t_+} {\neg t_+}\\ \textbf{Positive abstraction type} & t^\lambda_+ & ::= & \arrow {t_+} {t_+} \alt \arrow {t_+} {\neg t_+} \alt t^\lambda_+ \land t^\lambda_+\\ \textbf{Positive expression} & e_+ & ::= & c\alt x\alt e_+ e_+\alt\lambda^{t^\lambda_+} x.e_+\alt \pi_j e_+\alt(e_+,e_+)\alt\tcase{e_+}{t_{s}}{e_+}{e_+} \end{array}$ \begin{corollary}\label{app:completeness} If we restrict our language so that the only functional type that can be used in a test is $\arrow \Empty \Any$ and such that there is no negated arrows in the domain of lambda-abstractions, then the algorithmic type system becomes complete (i.e. any expression that can be typed in the declarative type system is also typeable in the algorithmic one) and type schemes can be removed from it (we can use regular types instead). If we restrict the language to positive expressions $e_+$, the algorithmic type system is complete and type schemes can be removed from it (we can use regular types instead). More precisely: $\forall \Gamma, e_+, t.\ \Gamma \vdash e_+:t \Rightarrow \tyof {e_+} \Gamma \neq \tsempty$ \end{corollary} \begin{proof} With such restrictions, the rule \Rule{Abs-} is not needed anymore. With such restrictions, the rule \Rule{Abs-} is not needed anymore because the negative part of functional types (i.e. the $N_i$ part of their DNF) is useless. Indeed, when typing an application $e_1 e_2$, the negative part of the type of $e_1$ (i.e. the $N_i$ part of its DNF) Indeed, when typing an application $e_1 e_2$, the negative part of the type of $e_1$ is ignored by the operator $\apply {} {}$. Moreover, as there is no negated arrows in the domain of lambda-abstractions, the negative arrows of the type of $e_2$ can also be ignored. Similarly, negative arrows can also be ignored when refining an application ($\worra {} {}$ also ignore the negative part Similarly, negative arrows can be ignored when refining an application ($\worra {} {}$ also ignore the negative part of the type of $e_1$). Finally, as the only functional type that we can test is $\arrow \Empty \Any$, a functional type ... ... @@ -1540,7 +1549,7 @@ Now we analyze the last rule of the derivation (only the cases that are not similar are shown): \begin{description} \item[\Rule{Abs-}] We know that the derivation of $\tyof e \Gamma$ (if any) ends with the rule \Rule{Abs\Aa}. Moreover, by using the induction hypothesis on the premise, we know that $\tyof e \Gamma \neq \varnothing$. Moreover, by using the induction hypothesis on the premise, we know that $\tyof e \Gamma \neq \tsempty$. Thus we have $\tyof e \Gamma \leq \neg (\arrow {t_1} {t_2}) = t$ (because every type $\neg (\arrow {s'} {t'})$ such that $\neg (\arrow {s'} {t'}) \land \bigwedge_{i\in I} \arrow {s_i} {t_i} \neq \Empty$ is in $\tsint{\tsfun{\arrow {s_i} {t_i}}}$). \end{description} ... ...
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