/*
 * Copyright (c) 2012-2017 The ANTLR Project. All rights reserved.
 * Use of this file is governed by the BSD 3-clause license that
 * can be found in the LICENSE.txt file in the project root.
 */

module antlr.v4.runtime.atn.PredictionMode;

import antlr.v4.runtime.atn.ATN;
import antlr.v4.runtime.atn.ATNConfig;
import antlr.v4.runtime.atn.ATNConfigSet;
import antlr.v4.runtime.atn.ATNState;
import antlr.v4.runtime.atn.AltAndContextMap;
import antlr.v4.runtime.atn.PredictionModeConst;
import antlr.v4.runtime.atn.RuleStopState;
import antlr.v4.runtime.atn.ContextMapObjectEqualityComparator;
import antlr.v4.runtime.atn.SemanticContext;
import antlr.v4.runtime.misc.BitSet;
import std.typecons;

// Class PredictionMode
/**
 * This enumeration defines the prediction modes available in ANTLR 4 along with
 * utility methods for analyzing configuration sets for conflicts and/or
 * ambiguities.
 */
class PredictionMode
{

    /**
     * Computes the SLL prediction termination condition.
     *
     * <p>
     * This method computes the SLL prediction termination condition for both of
     * the following cases.</p>
     *
     * <ul>
     * <li>The usual SLL+LL fallback upon SLL conflict</li>
     * <li>Pure SLL without LL fallback</li>
     * </ul>
     *
     * <p><strong>COMBINED SLL+LL PARSING</strong></p>
     *
     * <p>When LL-fallback is enabled upon SLL conflict, correct predictions are
     * ensured regardless of how the termination condition is computed by this
     * method. Due to the substantially higher cost of LL prediction, the
     * prediction should only fall back to LL when the additional lookahead
     * cannot lead to a unique SLL prediction.</p>
     *
     * <p>Assuming combined SLL+LL parsing, an SLL configuration set with only
     * conflicting subsets should fall back to full LL, even if the
     * configuration sets don't resolve to the same alternative (e.g.
     * {@code {1,2}} and {@code {3,4}}. If there is at least one non-conflicting
     * configuration, SLL could continue with the hopes that more lookahead will
     * resolve via one of those non-conflicting configurations.</p>
     *
     * <p>Here's the prediction termination rule them: SLL (for SLL+LL parsing)
     * stops when it sees only conflicting configuration subsets. In contrast,
     * full LL keeps going when there is uncertainty.</p>
     *
     * <p><strong>HEURISTIC</strong></p>
     *
     * <p>As a heuristic, we stop prediction when we see any conflicting subset
     * unless we see a state that only has one alternative associated with it.
     * The single-alt-state thing lets prediction continue upon rules like
     * (otherwise, it would admit defeat too soon):</p>
     *
     * <p>{@code [12|1|[], 6|2|[], 12|2|[]]. s : (ID | ID ID?) ';' ;}</p>
     *
     * <p>When the ATN simulation reaches the state before {@code ';'}, it has a
     * DFA state that looks like: {@code [12|1|[], 6|2|[], 12|2|[]]}. Naturally
     * {@code 12|1|[]} and {@code 12|2|[]} conflict, but we cannot stop
     * processing this node because alternative to has another way to continue,
     * via {@code [6|2|[]]}.</p>
     *
     * <p>It also let's us continue for this rule:</p>
     *
     * <p>{@code [1|1|[], 1|2|[], 8|3|[]] a : A | A | A B ;}</p>
     *
     * <p>After matching input A, we reach the stop state for rule A, state 1.
     * State 8 is the state right before B. Clearly alternatives 1 and 2
     * conflict and no amount of further lookahead will separate the two.
     * However, alternative 3 will be able to continue and so we do not stop
     * working on this state. In the previous example, we're concerned with
     * states associated with the conflicting alternatives. Here alt 3 is not
     * associated with the conflicting configs, but since we can continue
     * looking for input reasonably, don't declare the state done.</p>
     *
     * <p><strong>PURE SLL PARSING</strong></p>
     *
     * <p>To handle pure SLL parsing, all we have to do is make sure that we
     * combine stack contexts for configurations that differ only by semantic
     * predicate. From there, we can do the usual SLL termination heuristic.</p>
     *
     * <p><strong>PREDICATES IN SLL+LL PARSING</strong></p>
     *
     * <p>SLL decisions don't evaluate predicates until after they reach DFA stop
     * states because they need to create the DFA cache that works in all
     * semantic situations. In contrast, full LL evaluates predicates collected
     * during start state computation so it can ignore predicates thereafter.
     * This means that SLL termination detection can totally ignore semantic
     * predicates.</p>
     *
     * <p>Implementation-wise, {@link ATNConfigSet} combines stack contexts but not
     * semantic predicate contexts so we might see two configurations like the
     * following.</p>
     *
     * <p>{@code (s, 1, x, {}), (s, 1, x', {p})}</p>
     *
     * <p>Before testing these configurations against others, we have to merge
     * {@code x} and {@code x'} (without modifying the existing configurations).
     * For example, we test {@code (x+x')==x''} when looking for conflicts in
     * the following configurations.</p>
     *
     * <p>{@code (s, 1, x, {}), (s, 1, x', {p}), (s, 2, x'', {})}</p>
     *
     * <p>If the configuration set has predicates (as indicated by
     * {@link ATNConfigSet#hasSemanticContext}), this algorithm makes a copy of
     * the configurations to strip out all of the predicates so that a standard
     * {@link ATNConfigSet} will merge everything ignoring predicates.</p>
     */
    public static bool hasSLLConflictTerminatingPrediction(PredictionModeConst mode, ATNConfigSet configs)
    {
	/* Configs in rule stop states indicate reaching the end of the decision
         * rule (local context) or end of start rule (full context). If all
         * configs meet this condition, then none of the configurations is able
         * to match additional input so we terminate prediction.
         */
        if (allConfigsInRuleStopStates(configs)) {
            return true;
        }

        // pure SLL mode parsing
        if (mode == PredictionModeConst.SLL) {
            // Don't bother with combining configs from different semantic
            // contexts if we can fail over to full LL; costs more time
            // since we'll often fail over anyway.
            if (configs.hasSemanticContext) {
                // dup configs, tossing out semantic predicates
                ATNConfigSet dupli = new ATNConfigSet();
                foreach (ATNConfig c; configs.configs) {
                    c = new ATNConfig(c,SemanticContext.NONE);
                    dupli.add(c);
                }
                configs = dupli;
            }
            // now we have combined contexts for configs with dissimilar preds
        }

        // pure SLL or combined SLL+LL mode parsing

        BitSet[] altsets = getConflictingAltSubsets(configs);
        bool heuristic =
            hasConflictingAltSet(altsets) && !hasStateAssociatedWithOneAlt(configs);
        return heuristic;

    }

    /**
     * Checks if any configuration in {@code configs} is in a
     * {@link RuleStopState}. Configurations meeting this condition have reached
     * the end of the decision rule (local context) or end of start rule (full
     * context).
     *
     * @param configs the configuration set to test
     * @return {@code true} if any configuration in {@code configs} is in a
     * {@link RuleStopState}, otherwise {@code false}
     */
    public static bool hasConfigInRuleStopState(ATNConfigSet configs)
    {
	foreach (ATNConfig c; configs.configs) {
            if (c.state.classinfo == RuleStopState.classinfo) {
                return true;
            }
        }
        return false;
    }

    /**
     * Checks if all configurations in {@code configs} are in a
     * {@link RuleStopState}. Configurations meeting this condition have reached
     * the end of the decision rule (local context) or end of start rule (full
     * context).
     *
     * @param configs the configuration set to test
     * @return {@code true} if all configurations in {@code configs} are in a
     * {@link RuleStopState}, otherwise {@code false}
     */
    public static bool allConfigsInRuleStopStates(ATNConfigSet configs)
    {
	foreach (ATNConfig config; configs.configs) {
            if (config.state.classinfo != RuleStopState.classinfo) {
                return false;
            }
        }
        return true;
    }

    /**
     * Full LL prediction termination.
     *
     * <p>Can we stop looking ahead during ATN simulation or is there some
     * uncertainty as to which alternative we will ultimately pick, after
     * consuming more input? Even if there are partial conflicts, we might know
     * that everything is going to resolve to the same minimum alternative. That
     * means we can stop since no more lookahead will change that fact. On the
     * other hand, there might be multiple conflicts that resolve to different
     * minimums. That means we need more look ahead to decide which of those
     * alternatives we should predict.</p>
     *
     * <p>The basic idea is to split the set of configurations {@code C}, into
     * conflicting subsets {@code (s, _, ctx, _)} and singleton subsets with
     * non-conflicting configurations. Two configurations conflict if they have
     * identical {@link ATNConfig#state} and {@link ATNConfig#context} values
     * but different {@link ATNConfig#alt} value, e.g. {@code (s, i, ctx, _)}
     * and {@code (s, j, ctx, _)} for {@code i!=j}.</p>
     *
     * <p>Reduce these configuration subsets to the set of possible alternatives.
     * You can compute the alternative subsets in one pass as follows:</p>
     *
     * <p>{@code A_s,ctx = {i | (s, i, ctx, _)}} for each configuration in
     * {@code C} holding {@code s} and {@code ctx} fixed.</p>
     *
     * <p>Or in pseudo-code, for each configuration {@code c} in {@code C}:</p>
     *
     * <pre>
     * map[c] U= c.{@link ATNConfig#alt alt} # map hash/equals uses s and x, not
     * alt and not pred
     * </pre>
     *
     * <p>The values in {@code map} are the set of {@code A_s,ctx} sets.</p>
     *
     * <p>If {@code |A_s,ctx|=1} then there is no conflict associated with
     * {@code s} and {@code ctx}.</p>
     *
     * <p>Reduce the subsets to singletons by choosing a minimum of each subset. If
     * the union of these alternative subsets is a singleton, then no amount of
     * more lookahead will help us. We will always pick that alternative. If,
     * however, there is more than one alternative, then we are uncertain which
     * alternative to predict and must continue looking for resolution. We may
     * or may not discover an ambiguity in the future, even if there are no
     * conflicting subsets this round.</p>
     *
     * <p>The biggest sin is to terminate early because it means we've made a
     * decision but were uncertain as to the eventual outcome. We haven't used
     * enough lookahead. On the other hand, announcing a conflict too late is no
     * big deal; you will still have the conflict. It's just inefficient. It
     * might even look until the end of file.</p>
     *
     * <p>No special consideration for semantic predicates is required because
     * predicates are evaluated on-the-fly for full LL prediction, ensuring that
     * no configuration contains a semantic context during the termination
     * check.</p>
     *
     * <p><strong>CONFLICTING CONFIGS</strong></p>
     *
     * <p>Two configurations {@code (s, i, x)} and {@code (s, j, x')}, conflict
     * when {@code i!=j} but {@code x=x'}. Because we merge all
     * {@code (s, i, _)} configurations together, that means that there are at
     * most {@code n} configurations associated with state {@code s} for
     * {@code n} possible alternatives in the decision. The merged stacks
     * complicate the comparison of configuration contexts {@code x} and
     * {@code x'}. Sam checks to see if one is a subset of the other by calling
     * merge and checking to see if the merged result is either {@code x} or
     * {@code x'}. If the {@code x} associated with lowest alternative {@code i}
     * is the superset, then {@code i} is the only possible prediction since the
     * others resolve to {@code min(i)} as well. However, if {@code x} is
     * associated with {@code j>i} then at least one stack configuration for
     * {@code j} is not in conflict with alternative {@code i}. The algorithm
     * should keep going, looking for more lookahead due to the uncertainty.</p>
     *
     * <p>For simplicity, I'm doing a equality check between {@code x} and
     * {@code x'} that lets the algorithm continue to consume lookahead longer
     * than necessary. The reason I like the equality is of course the
     * simplicity but also because that is the test you need to detect the
     * alternatives that are actually in conflict.</p>
     *
     * <p><strong>CONTINUE/STOP RULE</strong></p>
     *
     * <p>Continue if union of resolved alternative sets from non-conflicting and
     * conflicting alternative subsets has more than one alternative. We are
     * uncertain about which alternative to predict.</p>
     *
     * <p>The complete set of alternatives, {@code [i for (_,i,_)]}, tells us which
     * alternatives are still in the running for the amount of input we've
     * consumed at this point. The conflicting sets let us to strip away
     * configurations that won't lead to more states because we resolve
     * conflicts to the configuration with a minimum alternate for the
     * conflicting set.</p>
     *
     * <p><strong>CASES</strong></p>
     *
     * <ul>
     *
     * <li>no conflicts and more than 1 alternative in set =&gt; continue</li>
     *
     * <li> {@code (s, 1, x)}, {@code (s, 2, x)}, {@code (s, 3, z)},
     * {@code (s', 1, y)}, {@code (s', 2, y)} yields non-conflicting set
     * {@code {3}} U conflicting sets {@code min({1,2})} U {@code min({1,2})} =
     * {@code {1,3}} =&gt; continue
     * </li>
     *
     * <li>{@code (s, 1, x)}, {@code (s, 2, x)}, {@code (s', 1, y)},
     * {@code (s', 2, y)}, {@code (s'', 1, z)} yields non-conflicting set
     * {@code {1}} U conflicting sets {@code min({1,2})} U {@code min({1,2})} =
     * {@code {1}} =&gt; stop and predict 1</li>
     *
     * <li>{@code (s, 1, x)}, {@code (s, 2, x)}, {@code (s', 1, y)},
     * {@code (s', 2, y)} yields conflicting, reduced sets {@code {1}} U
     * {@code {1}} = {@code {1}} =&gt; stop and predict 1, can announce
     * ambiguity {@code {1,2}}</li>
     *
     * <li>{@code (s, 1, x)}, {@code (s, 2, x)}, {@code (s', 2, y)},
     * {@code (s', 3, y)} yields conflicting, reduced sets {@code {1}} U
     * {@code {2}} = {@code {1,2}} =&gt; continue</li>
     *
     * <li>{@code (s, 1, x)}, {@code (s, 2, x)}, {@code (s', 3, y)},
     * {@code (s', 4, y)} yields conflicting, reduced sets {@code {1}} U
     * {@code {3}} = {@code {1,3}} =&gt; continue</li>
     *
     * </ul>
     *
     * <p><strong>EXACT AMBIGUITY DETECTION</strong></p>
     *
     * <p>If all states report the same conflicting set of alternatives, then we
     * know we have the exact ambiguity set.</p>
     *
     * <p><code>|A_<em>i</em>|&gt;1</code> and
     * <code>A_<em>i</em> = A_<em>j</em></code> for all <em>i</em>, <em>j</em>.</p>
     *
     * <p>In other words, we continue examining lookahead until all {@code A_i}
     * have more than one alternative and all {@code A_i} are the same. If
     * {@code A={{1,2}, {1,3}}}, then regular LL prediction would terminate
     * because the resolved set is {@code {1}}. To determine what the real
     * ambiguity is, we have to know whether the ambiguity is between one and
     * two or one and three so we keep going. We can only stop prediction when
     * we need exact ambiguity detection when the sets look like
     * {@code A={{1,2}}} or {@code {{1,2},{1,2}}}, etc...</p>
     */
    public static int resolvesToJustOneViableAlt(BitSet[] altsets)
    {
	return getSingleViableAlt(altsets);
    }

    /**
     * Determines if every alternative subset in {@code altsets} contains more
     * than one alternative.
     *
     * @param altsets a collection of alternative subsets
     * @return {@code true} if every {@link BitSet} in {@code altsets} has
     * {@link BitSet#cardinality cardinality} &gt; 1, otherwise {@code false}
     */
    public static bool allSubsetsConflict(BitSet[] altsets)
    {
	return !hasNonConflictingAltSet(altsets);
    }

    /**
     * Determines if any single alternative subset in {@code altsets} contains
     * exactly one alternative.
     *
     * @param altsets a collection of alternative subsets
     * @return {@code true} if {@code altsets} contains a {@link BitSet} with
     * {@link BitSet#cardinality cardinality} 1, otherwise {@code false}
     */
    public static bool hasNonConflictingAltSet(BitSet[] altsets)
    {
	foreach (BitSet alts; altsets) {
            if (alts.cardinality == 1) {
                return true;
            }
        }
        return false;
    }

    /**
     * Determines if any single alternative subset in {@code altsets} contains
     * more than one alternative.
     *
     * @param altsets a collection of alternative subsets
     * @return {@code true} if {@code altsets} contains a {@link BitSet} with
     * {@link BitSet#cardinality cardinality} &gt; 1, otherwise {@code false}
     */
    public static bool hasConflictingAltSet(BitSet[] altsets)
    {
	foreach (BitSet alts; altsets) {
            if (alts.cardinality >1) {
                return true;
            }
        }
        return false;
    }

    /**
     * Determines if every alternative subset in {@code altsets} is equivalent.
     *
     * @param altsets a collection of alternative subsets
     * @return {@code true} if every member of {@code altsets} is equal to the
     * others, otherwise {@code false}
     */
    public static bool allSubsetsEqual(BitSet[] altsets)
    {
        BitSet first;
        foreach (i, el; altsets) {
            if (i == 0)
                first = el;
            else
                if (!el.opEquals(first)) return false;
        }
        return true;
    }

    /**
     * Returns the unique alternative predicted by all alternative subsets in
     * {@code altsets}. If no such alternative exists, this method returns
     * {@link ATN#INVALID_ALT_NUMBER}.
     *
     * @param altsets a collection of alternative subsets
     */
    public static int getUniqueAlt(BitSet[] altsets)
    {
	BitSet all = getAlts(altsets);
        if (all.cardinality == 1)
            return all.nextSetBit(0);
        return ATN.INVALID_ALT_NUMBER;
    }

    /**
     * Gets the complete set of represented alternatives for a collection of
     * alternative subsets. This method returns the union of each {@link BitSet}
     * in {@code altsets}.
     *
     * @param altsets a collection of alternative subsets
     * @return the set of represented alternatives in {@code altsets}
     */
    public static BitSet getAlts(BitSet[] altsets)
    {
	BitSet all;
        foreach (BitSet alts; altsets) {
            all = all.or(alts);
        }
        return all;
    }

    public static BitSet getAlts(ATNConfigSet configs)
    {
	BitSet *alts;
        alts = new BitSet;
        foreach (ATNConfig config; configs.configs) {
            alts.set(config.alt, true);
        }
        return *alts;
    }

    /**
     * This function gets the conflicting alt subsets from a configuration set.
     * For each configuration {@code c} in {@code configs}:
     *
     * <pre>
     * map[c] U= c.{@link ATNConfig#alt alt} # map hash/equals uses stack and context, not
     * alt and not pred
     * </pre>
     */
    public static BitSet[] getConflictingAltSubsets(ATNConfigSet configs)
    {
	AltAndContextMap configToAlts;
        BitSet *alts;

        foreach (ATNConfig c; configs.configs) {
            auto c_copy = new ATNConfig(c);
            if (!configToAlts.hasKey(c_copy))
                {
                    alts = new BitSet();
                    alts.set(0, false); //  initialise alts
                    configToAlts.put(c_copy, *alts);
                }
            else {
                *alts = configToAlts.get(c_copy);
            }
            alts.set(c_copy.alt, true);
        }
        return configToAlts.altAndContextMap.values;
    }

    /**
     * Get a map from state to alt subset from a configuration set. For each
     * configuration {@code c} in {@code configs}:
     *
     * <pre>
     * map[c.{@link ATNConfig#state state}] U= c.{@link ATNConfig#alt alt}
     * </pre>
     */
    public static BitSet[ATNState] getStateToAltMap(ATNConfigSet configs)
    {
	BitSet[ATNState] m;
        foreach (ATNConfig c; configs.configs) {
            BitSet alts;
            if (!(c.state in m)){
                alts.clear;
                m[c.state] = alts;
            }
            alts.set(c.alt, true);
        }
        return m;
    }

    public static bool hasStateAssociatedWithOneAlt(ATNConfigSet configs)
    {
	BitSet[ATNState] x = getStateToAltMap(configs);
        foreach (alts; x.values) {
            if (alts.cardinality == 1)
                return true;
        }
        return false;
    }

    public static int getSingleViableAlt(BitSet[] altsets)
    {
	BitSet viableAlts;
        foreach (BitSet alts; altsets) {
            int minAlt = alts.nextSetBit(0);
            viableAlts.set(minAlt, true);
            if (viableAlts.cardinality > 1) { // more than 1 viable alt
                return ATN.INVALID_ALT_NUMBER;
            }
        }
        return viableAlts.nextSetBit(0);
    }

}